|Numéro de publication||US4412285 A|
|Type de publication||Octroi|
|Numéro de demande||US 06/250,022|
|Date de publication||25 oct. 1983|
|Date de dépôt||1 avr. 1981|
|Date de priorité||1 avr. 1981|
|État de paiement des frais||Payé|
|Autre référence de publication||CA1178716A, CA1178716A1, DE3279188D1, EP0069438A2, EP0069438A3, EP0069438B1|
|Numéro de publication||06250022, 250022, US 4412285 A, US 4412285A, US-A-4412285, US4412285 A, US4412285A|
|Inventeurs||Philip M. Neches, David H. Hartke, Richard C. Stockton, Martin C. Watson, David Cronshaw, Jack E. Shemer|
|Cessionnaire d'origine||Teradata Corporation|
|Exporter la citation||BiBTeX, EndNote, RefMan|
|Citations de brevets (3), Référencé par (235), Classifications (15), Événements juridiques (9)|
|Liens externes: USPTO, Cession USPTO, Espacenet|
This application is filed concurrently with an application entitled "Data Processing Systems and Methods", Ser. No. 250,094, filed Apr. 1, 1981, in the name of Philip M. Neches, which application is also assigned to the assignee hereof.
The concurrently filed application of Philip M. Neches describes and claims improved data processing systems and methods which in substantial measure are based upon and emanate from a novel active logic network. The active logic network is so configured and arranged that it merges a number of concurrent, competing message packets from different sources during message transfer on the network. A converging progression of pair comparisons is continued without interruption until a winning message packet is determined, and then distributed in the opposite direction to all sources. A coherent priority scheme is employed that encompasses a variety of message types such that responses, status and control messages can be intermingled in the transmissions. In consequence of these and other factors, the ratio of data message traffic to overhead traffic on the network is significantly increased over prior systems. Moreover, the system is broadly expandable without a concomitant increase in overhead systems or software. Use of these techniques greatly facilitates the ways in which multiple message sources, such as an array of data processors may work cooperatively toward a common purpose. The copending application further discloses and claims improved multiprocessor systems, including relational data base machines, arranged both as backend processors and stand alone systems.
Reference should be made to the full co-pending application for a more detailed appreciation of the different aspects and implications of the system, and for a listing and discussion of patents that typify the present state of the art. The present application is concerned with meeting more specific needs of multiprocessor systems in general, and the referenced system in particular.
These needs pertain to the ways in which the processors intercommunicate so that they perform their own tasks efficiently and coherently within the global resource context. A versatile multiprocessor must be able to distribute subtasks in a number of ways, ascertain the status of the processors performing the subtasks, merge and sort messages, correct and revise data, and ascertain when and how resources have changed (as when processors fail or come on line). Performance of such functions has heretofore entailed the use of excessive overhead software and hardware.
As one example, it is often required in a multiprocessor system, such as a data base machine, to route messages between processors so as to select an individual destination processor, or select a class of processors, or select the destination not upon a processor identification but instead upon the portion of the data base distributed to that processor, as by a hashing technique. In some known systems a prefatory communication sequence is used, in which a linkage is established between the sending processor and one or more specific receiving processors. Repeated requests and acknowledgments may be needed to establish the linkage, and deadlock conditions that may arise must be overcome by the use of further hardware and software. In other systems a supervisory control is exercised by one processor or a bus controller, to assure that the transmitting processor is ready to transmit, that the receiving processor or processors are ready to receive, that other processors are blocked out of the linkage and that no extraneous transmissions are generated. Again, the commitment to overhead and the intricacies needed to avoid deadlocks require maintenance functions that become disproportionately large as the system is expanded (e.g. to more than 16 processors).
One objective of the present invention is to make use of the various capabilities of the Neches concept without diminution of the efficiency of the system, requiring additional software, or restricting the capacity for expansion. Another objective is to provide the needed intercommunication versatility in such a way that extremely large numbers of processors (e.g. 1024) can be used in a system without imposing overhead penalties or creating deadlock or lockout possibilities.
Another example of what is required of a modern multiprocessor system relates to how the system can assuredly determine the status of the subtasks being performed by one or a number of processors. A basic requirement is that there be an ability to interrogate a given processor as to its status, without having the interrogation affect the status or creating ambiguity as to the nature of the response. The term "semaphore" has been used in the industry to characterize the function of testing and setting a status indication without interruption. The presence of a semaphore feature is desirable, but should not be incorporated at the expense of diminished performance or increased overhead load. The determination of status in turn becomes extremely important in carrying out sort/merge operations in a multiprocessor system, because the combined results of a plurality of subtasks within a major task cannot be united until the subtasks are appropriately completed. Another requirement is that the processor report its current status and that subtasks be performed only once despite repeated interruptions and changes in the multiprocessor sequence. In most present systems processor routines can be disrupted so that significant problems can arise in these respects. It can readily be appreciated that where a plurality of processors are performing related subtasks, the sequences involved in repeated interrogations and responses as to the degree of readiness of the individual processors can require significant overhead, and that the greater the number of processors the more disproportionate is the commitment to dedicated overhead.
Illustrative of the above, a typical drawback in prior art multiprocessor systems is the so-called "distributed update" problem, which is the need to update information a copy of which may be stored in each of several processing elements. This information may consist of data records or of information used to control the operation of the system such that processing can be initiated, terminated, resumed, suspended, or rolled backwards or forwards without causing any required steps to be erroneously either duplicated or omitted. Solutions of the distributed update problem in prior art systems suffer significant limitations. Some consider only two processors at a time. Still others involve protocols of intercommunication which are so complex that they have resisted all efforts to date to prove their correctness in a mathematically rigorous manner.
The complexity of these protocols results from the need to implement a "global semaphore", a control bit which has the appearance that it is tested and set in every processor as one uninterruptable operation. The control bits reside in different processors, with variable delays in communication between them, and necessarily imperfect communications channels introduce noise and also increase the tendency to errors. Those skilled in the art will therefore readily appreciate the difficulty of giving the appearance of a single, uninterrupted operation when the elements which compose the operation are diverse, interruptible, cannot be accessed at the same times, and prone to failures between access attempts.
The many message routing, mode control and status indication functions required for a complex and versatile multiprocessor system are provided in accordance with the invention by a unique combination of message organization and traffic controlling interface circuits functioning with the active logic network. Message packets, which may be of variable lengths, are organized into variable sequences of fields, the field values being selected to have significance in the prioritizing network. The interface circuits store incoming and outgoing message packets with bidirectional accessibility and moreover include sections dedicated to destination, status and control functions. Particular message fields within a broadcast primary message packet determine, solely by interface operation, whether a message packet is to be accepted by the associated processor, and the multiprocessor mode of operation that is to be used. Responses, status and control messages all function within this cooperative format, serving both a prioritizing function and a traffic control or routing function.
A further feature is that transaction identities are included in primary data, status and control messages. Using the transaction identity as a reference, the local processor maintains at the interface circuits, accessible to the network, a locally updated indication of the state of readiness of that processor as to the task bearing the transaction identity.
In conjunction with this feature, a distributed update as to the global status of the system can be derived by a single query to all processors. Each responds concurrently with its local status, and the least ready status is accorded highest priority in sorting on the network. Thus a single response from all processors is merged into one indication of global readiness.
In a more specific example of a system and method in accordance with the invention, the message organization incorporates an initial command word, which includes a transaction number for primary, status and control messages, or an originating processor identification for responses. The numerical values of the initial portion of the command word, and the transaction number (or originating processor identification) all form a part of the coherent set of priority values such that the network distinguishes between and gives precedence to messages based both upon type and specific data content within the type. An optional key field used as a sorting criteria may also be employed in the message. The data field, which may be of variable length, may initiate with a destination selection word, which by its data content designates a specific individual processor for reception of the message, a process class, or a hashing value related to distributed data storage. A high speed random access memory serves as a buffer between the relatively high speed network and the substantially lower speed microprocessor, having individual ports for coupling to both the network and the processor bus. A portion of the high speed random access memory includes dedicated sections which may be directly addressed by the destination selection word, enabling a specific processor, process class or hashing value to govern destination selection. The high speed random access memory also contains a directory of numerical values representing readiness states for the processor, which the processor may reference to locally update status pertaining to a given transaction number. An inquiry from the network elicits an immediate and unambiguous response as to the local readiness state. The status responses also have predetermined rankings within the priority schedule, and merger of the responses of the network reveals the lowest state of readiness when received by the requesting processor.
In a sort/merge operation, subtasks identified by transaction numbers are distributed as appropriate throughout various individual processors, where the input messages are stored in a circular buffer section in the high speed random access memory. Sequences of output messages available for transmission to the network are assembled by each local processor, the high speed random access memory including a circular output vector section that enables chaining of the output messages together in an ordered sequence. Thus each local processor provides a sorted sequence of output message packets pertaining to each transaction number. Single queries suffice to determine the global state of readiness as to the particular task. When all processors are ready, they concurrently and repeatedly attempt to launch their highest priority messages onto the network, which prioritizes them by transferring winning messages in sequence until that transaction number is exhausted, after which the next transaction number may be selected. A transaction number of zero establishes the non-merge mode without any further communication being needed.
The system provides an integrated, essentially hardware based, mechanism for logical control of globally distributed resources. The dedicated buffer system and interrelated message organization perform global semaphore, control and pacing functions within the system. The random access memory is not only used in particular ways in receiving and supplying outgoing and incoming messages, but also in assuring that overrun conditions do not occur.
Further in accordance with the invention, each group of multiple parallel data lines interconnecting the node elements in the network is associated with a control line, the signal patterns on which vary in accordance with the field groupings, to demarcate transitions between fields and also to characterize the different fields for different types of messages. A parity line may also be used, not only to identify parity errors occurring during transfer, at the node elements or at the processors, but also in conjunction with means for forcing a parity error to denote the failure or recovery of a processor in the system. This is a readily achieved but immediately effective means for generating an interrupt indication to denote a change in the global resource. Further, the network also includes unidirectional couplings between node elements in the successive tiers, transferring indication of loss of priority from the node at which a determination is made through the successive lower tiers back to the originating processor, which thereupon can terminate transmission for that message packet.
The bidirectional network and a unique clocking arrangement assure simultaneous broadcasting of a message packet to all processors. A high speed clock fed in at the apex of the network is regenerated at each of the active circuit nodes with zero time skew along the network. The network may be physically distributed with active circuit elements intercoupled by short path length conductors or by transmissions lines in a compact but expandable configuration.
A better understanding of the invention may be had by reference to the following description, taken in conjunction with the accompanying drawings, in which:
FIG. 1 is a block diagram of a system in accordance with the invention including a novel bidirectional network;
FIG. 2 is a set of sequential diagrams comprising FIG. 2 and FIGS. 2A to 2J showing the transmission of data and control signals in a simplified example of the network of FIG. 1;
FIG. 3 is a graphical representation of the organization of a message packet used in the system of FIG. 1;
FIG. 4 is a block diagram showing further details of the novel bidirectional network of FIG. 1 as to the active logic nodes and clock circuits employed therein;
FIG. 5 is a state diagram depicting various conditions of operation in the active logic nodes;
FIG. 6 is a timing diagram useful in explaining end of message detection in the active logic nodes;
FIG. 7 is a diagram of timing waveforms useful in explaining the operation of the clock circuits of FIG. 4;
FIG. 8 is a block diagram of a processor module, including a high speed random access memory, that may be employed in the system of FIG. 1;
FIG. 9 is a diagram of address allocation in the main RAM of a microprocessor system as shown in FIG. 8;
FIG. 10 is a block diagram of the arrangement of data within one reference portion of the high speed random access memory of FIG. 8;
FIG. 11 is a chart showing the message priority protocol used in the system;
FIG. 12 is a graphical representation of transaction number word formats;
FIG. 13 is a block diagram of interface circuits employed with each processor module in the system of FIGS. 1 and 8 and comprises two sheets (FIGS. 13 and 13A) that are to be placed together with FIG. 13A on the right;
FIG. 14 is a timing diagram showing various clock and phase waveforms used in the interface circuits of FIG. 13;
FIG. 15 is a block diagram showing further details of organization of memory and a system for mapping in accordance with destination selection words;
FIG. 16 is a simplified flow diagram depicting status changes on reception of an input data message;
FIG. 17 is a flow diagram depicting status changes in receiving a message and comprising two sheets and designated FIG. 17 and FIG. 17A, to be abutted with FIG. 17 on the top;
FIG. 18 is a matrix diagram showing the relationship between primary messages and generated responses and between primary messages and responsive actions;
FIG. 19 is a flow diagram depicting status changes in sending a message and comprising two sheets and designated FIG. 19 and FIG. 19A, to be abutted with FIG. 19 on the top;
FIG. 20 is a block diagram of a stand alone system in accordance with the invention;
FIG. 21, comprising FIGS. 21A and 21B, is a diagram of messages stored in the high speed random access memory; and
FIG. 22 is a simplified diagram of one way in which parts of a data base may be distributed among different processes in a data base system.
The system depicted generally in FIG. 1 is illustrative of usage of the concepts of the invention in a data base management application. Specifically, the system is configured for cooperation with one or more host computer systems 10, 12, such as one of the IBM 370 family or DEC PDP-11 family, which advantageously, for purposes of this example, operate with existing and conventional operating system and applications software. In the IBM terminology the principal intercommunication networks between the host and the data base computer are referred to as channels while in the DEC terminology the equivalent is referred to as a "UNIBUS" or "MASSBUS" or some other variant. Whether one of these systems or the main frame computer of another manufacturer is used, the channel or bus is an ohmic or logically passive pathway on which data base tasks and subtasks are presented.
The example of FIG. 1 shows a backend processor complex in association with host systems 10, 12. The system accepts tasks and subtasks from the host system, references the appropriate part or parts of an extensive data base storage, and returns appropriate processed or responsive messages in such fashion that no more than menial software management is required of the host systems, irrespective of the configuration of the backend processor complex. Consequently, the user's data base can be structured in a new multiprocessor system in which the data are organized in relational data base files of broadly expandable capacity; expansion can occur without any need to change the operating system or existing applications software resident in the user's host system. An example of a stand alone system is described below in conjunction with FIG. 20.
It will be recognized by those skilled in the art that relational data base management involves an overall function which is divisible into processing tasks that are separable, at least temporarily, because the data entries in storage are not interdependently linked by address pointers. It will also be recognized that many other data processing situations exist in which dynamic subdivision and independent processing of limited or iterative tasks can be used. Thus while this example of the invention is described in terms of the demanding and widely encountered data base management processing problem, the novel methods and implementations disclosed herein are of broad applicability elsewhere as well.
A large data management system involves both potential advantages and the inherent difficulties when multiple processors are to be used. Vast numbers of entries, ranging into the hundreds of millions, must be held conveniently and rapidly accessible in storage. With the relational data base format, a wide range of data entry and information retrieval functions can be carried out concurrently.
In the great majority of data base systems, however, it is as important to maintain the integrity of the data base as it is to process transaction data rapidly. Integrity of data must be preserved across hardware failures, power outages, and other operational mishaps. Further, the data base system must be capable of restoring the data base to a known state to recover from user errors which can include bugs in applications software code. However, the data cannot be lost or entered erroneously, and all parts of the data base that relate to a specific entry must be changed responsively, whether the event involves new data, corrections for past errors or revision of a portion of a data base.
Integrity therefore implies that a degree of redundancy is required in the data base system, along with data roll back and recovery operations, error detection and correction, and detection of and compensation for changes in status of individual parts of the system. The system may have to be used in a number of different specific modes to accomplish these objectives.
It is further required of modern systems to be able to accept discretionary queries that can be complex in form and to respond if necessary in an interactive fashion. Those who seek access to the system should not, despite the complexity of the query, be required to be experts in the system. Examples of discretionary queries that may be generated pertaining to a large production operation include the following:
A. A production manager might ask not merely for an item in inventory but for an inventory aging that identifies all parts inventories which are in excess of the monthly production rate for a part whose production rate is at least 10% less than in the comparable month for the prior year.
B. A marketing manager might ask, not merely if a particular account is 90 days overdue, but for all 90 day receivables as to customers from a particularly depressed geographic area who have exceeded 120 days in the past.
C. A personnel director might ask not merely for a listing of all employees having in excess of two weeks sick leave for a given year but for a listing of all employees with more than ten years longevity who were on sick leave for more than one week during frogging season in more than two of the prior five years.
In all of these examples, the user seeks to gain an insight into a real problem confronting him professionally by correlating, in unanticipated ways, information stored in the computer. The user's experience with his own problem areas and thus his intuition and imagination permits the non-computer-trained professional to make facile use of a data base system that is capable of handling complex queries.
Modern multiprocessor systems seek to satisfy these many and often conflicting requirements through the use of elaborate overhead and maintenance software systems, which inherently militate against easy expansion of the system. Expandability, however, is a highly desirable concept, because any growing business or operation inherently wishes to enlarge and retain its existing data base management system and not to be forced into the adoption of a new system and software.
The Multiprocessor Array
In FIG. 1, a typical system in accordance with the invention includes multiple microprocessors of two principal types, herein designated the interface processor (IFP) and the access module processor (AMP). Two IFPs 14, 16, are depicted, each coupled to the I/O system of a different host computer 10 or 12. A number of access module processors 18-23 inclusive are also incorporated in what may be termed a multiprocessor array. The term "array" is used in the conventional sense of referring to a set, collection or number of processor units disposed in a generally ordered linear or matrix fashion, and does not connote what has come to be referred to as an array processor. Although only eight microprocessors have been depicted as a simplified example of the system concept, many more IFPs and AMPs can and typically will be used.
The IFPs 14, 16 and AMPs 18-23 incorporate Intel 8086 16 bit microprocessors having an internal bus and a main memory with direct memory access for peripheral device controllers. Any of a wide variety of microprocessors and microprocessor system products of different manufacturers may be utilized. The "microprocessor" is merely a specific example of one type of computer or processor that may be used in the array, because the system concept can be used to advantage with minicomputers or large computer systems where the application demands such computing power. The 16 bit microprocessor is an advantageous example of a low cost unit having substantial data processing power and a standard replaceable configuration with a wide range of available hardware and software options.
The IFPs and AMPs utilize similar active logic, control logic and interface circuitry; microprocessors; memories; and internal busses, as described below in conjunction with FIGS. 1 and 8 respectively. These two processor types differ, however, in the nature of and control logic for their associated peripheral devices. Those skilled in the art will readily appreciate that other processor types with different peripheral controllers and functional assignments can be readily incorporated into this invention.
Each microprocessor has associated therewith a high speed random access memory 26 (described in conjunction with FIG. 8) which not only provides buffering of input and output messages but also coacts uniquely with other parts of the system to provide message management. Briefly, the high speed random access memories 26 function as a circular buffer for variable length input (called "receive") messages, provide sequential message output (called "send") storage, incorporate a table lookup portion for use in hash mapping and other modes, and store control information for orderly and sequenced handling of receive and send messages. The memories 26 are further used to fulfill unique roles in multiprocessor mode selection and in handling data, status, control and response message traffic. As described in detail hereafter, they are also arranged such that, based upon transaction identities in the messages, local and global status determinations and control functions are processed and communicated in highly efficient fashion. Control logic 28 (described below in conjunction with FIG. 13) at each IFP 14, 16 and AMP 18-23 is used in data transfer within the module and in the performance of overhead functions.
The IFPs 14, 16 each include an interface control 30 coupling the IFP to the channel or bus of the associated host computer 10 or 12. In the AMPs 18-23, however, the comparable unit is a disk controller 32 which may be of conventional configuration and which is employed to interface the AMPS 18-23 respectively with individually associated magnetic disk drives 38-43 respectively.
The magnetic disk drives 38-43 provide the secondary or mass storage for the data base management system. In the present example, they comprise proven commercial products, such as Winchester technology, to provide high capacity and high reliability storage with extremely low cost per byte.
The relational data base is stored on these disk drives 38-43 in scatter storage fashion as shown in simplified form in FIG. 22. Each processor and associated disk drive is assigned a disjoint primary subset of the records comprising the complete data base, so that each of n storages has 1/nth of the data base. Further, each processor also is assigned disjoint backup data subsets making up 1/nth of the data base. As seen in FIG. 22, each primary file is duplicated by a backup file at a different processor, giving two complete data bases distributed in different ways. This redundant arrangement of the primary and backup data subsets protects the integrity of the data base, because no large blocks of data or groups of relations can be substantially affected by a single failure.
Distribution of the data base is interrelated, as also shown in FIG. 22, with hashing of the various files, and incorporation of hash mapping data in the messages. The files at each processor are designated by simplified hash buckets shown as groups of binary series. The relations and tuples in a relational data base system thus can be located by the tables of relationships defined by the buckets. Hashing algorithms are used to derive the bucket assignments from keys in the relational data base system, so that expansion and modification of the data base system are readily feasible.
Selection of storage capacity is dependent upon data base management needs, transaction volume, and the processing power of the associated microprocessors. While a number of disk drives may be coupled to a single AMP, or a single disk file coupled to more than one AMP, such modifications will usually be limited to special applications. Extension of the data base typically is achieved by expanding the number of processors (and associated disk drives) in the multiprocessor array.
Active Logic Network
The objectives of providing orderly message packet flow and facilitating task performance are met by the use of a unique system architecture and message organization, centered upon a novel active logic network structure 50. This structure comprises, relative to the outputs of the microprocessors, a converging, ascending hierarchy of bidirectional active logic nodes 54. The nodes 54 comprise three port bidirectional circuits which may be described as forming a tree network, with couplings to the microprocessors 14, 16 and 18-23 being made at the base of the tree.
It will be recognized by those skilled in the art that nodes may be constructed where the number of logical sources is greater than 2, say 4 or 8, where the greater number of source inputs may also be resolved in the same time by the addition of more combinatorial logic.
For convenience of reference, all nodes (N) in the first tier are designated by the prefix I, in the second tier by the prefix II, and so forth. Individual nodes within a tier are designated by the subscripts 1, 2 . . . , so that, for example, the fourth node in the first tier may be referred to as IN4. At the up-tree (or upstream) side, there is a single port, called the C port, which is coupled to one of the two down-tree ports, called the A and B ports, of a node in the next higher tier. The tiers converge to an uppermost or apex node 54a representing a convergence and recirculating means which directs upstream (up-tree) messages back in the downstream (down-tree) direction. Two tree networks 50a, 50b are utilized, the nodes and interconnections of the two networks being disposed in parallel to provide the redundancy desired for a large scale system. Inasmuch as the nodes 54 and the networks are identical, only one need be described.
To aid in visualization, it should be understood first that multiple message packets in the form of serial signal trains are or can be launched concurrently into the active logic network 50 on the couplings for many of the microprocessors. The active logic nodes 54 each function in binary fashion in determining priority between two colliding packets, using the data contents of the message packets themselves. Further, all nodes 54 in a network are under the command of a clock source 56 arranged with the nodes 54 in such fashion as to synchronously advance the message packet trains toward the apex node 54a. In this manner each succeeding byte or other incremental segment of a serial train progresses to the next tier at the same time as the corresponding bytes of other messages also advance along other paths in the network 50.
A prioritized sort of competing signal trains takes place for message packets moving up-tree, ultimately to select a single message train to be redirected from the apex node 54a downstream. Because of the system organization, the decision as to ultimate priority need not occur at any particular point in the message packet, so that message transmission can be carried forward without requiring any more than the binary decisions between two colliding packets that are being made at the individual nodes 54. As a result the system provides message selection and data transfer in the space and time domains but does not delay message transmissions for purposes of gaining control of the bus, identifying sending or receiving processors, or performing handshaking operations between processors.
Further, it is important to recognize that when several processors send identical packets at the same time, if successful, it will appear that all such sending processors were successful. This property is extremely useful in exercising efficient control of a large multiprocessor complex, because of the savings in time and overhead.
The nodes 54 also operate in bidirectional fashion to enable unimpeded downstream distribution of the message packets. At a given node 54 downstream messages received at the port C on the up-tree side are distributed to both ports A and B on the down-tree side and then transmitted on to both associated nodes at the next lower tier. Under the control of the common clock circuit 56, the message packet advances synchronously down-tree to be broadcast to all microprocessors simultaneously, enabling one or many of the processors to carry out the desired processing task or to accept a response.
The network 50 has a high data transfer rate in comparison to the data transfer rates of the microprocessors, typically being a multiple greater than two. In this particular example the network 50 has a byte clock interval of 120 nanoseconds and the data transfer rate is five times that of the microprocessor. Each node 54 is coupled, at each of its three ports, to the associated node port in the next tier, or to the microprocessor, by a set of data lines (here 10 in number) and by control lines here 2 in number) and devoted to clock and collision signals respectively. The data and clock lines run in pairs, with separate lines for the uptree and downtree directions. The collision line propagates down tree only. The connections form a full duplex data path, with no delay needed to "turn around" the drive sense of any line.
Referring now to FIG. 3, the 10 data lines comprise an 8 bit byte, designated as bits 0-7 inclusive, occupying 8 of the 10 data lines. Another line, designated C, is a control line, carrying a control sequence that is used to characterize different parts of the message packet in particular ways. The 10th bit is used for odd parity in the present example. Practitioners skilled in the art will recognize that the system can readily be operated with more or fewer bits in the data path.
The byte sequences are arranged in successive fields, basically divided into command, key, destination selection, and data fields. As is discussed further below, a message may utilize only a single field, and concludes with a detectable End of Message code. An intervening idle field between messages is designated by an unbroken sequence of 1's on the C line, as well as on lines 0-7, and is transmitted whenever no message packet is available. The parity line is also employed in a unique fashion to communicate a change of status of an individual processor.
The idle state is an intermediate state and is not a part of the message packet, which typically begins with a 2 byte command word that includes a tag in the form of a transaction number (TN) for data messages or an originating processor ID (OPID) for response messages. The transaction number has many levels of significance in the system and serves as the basis for a number of functional communications and controls. The packet may thereafter contain any or all of a variable length key field and a fixed length destination selection word (DSW) as the first part of a variable length data field. The key field serves the purpose or providing sorting criteria, where messages are otherwise substantially identical. The DSW provides the basis for a number of special functions and also merits particular attention, along with the TN.
The system operates with the interfaces in word synchronism, so that the first bytes of the command words are provided to the network 50 concurrently by all processors which have a packet to transmit. The data contents of the successive fields are used by the network in sorting on a binary basis at each node, with the lowest numerical value being given priority. Taking bit C as the largest quantity and bit 0 as the smallest in the successive data bits, the sorting priority order is:
1. first arrival at the network 50;
2. lowest command code (word);
3. lowest key field;
4. shortest key field;
5. lowest data field (including the destination selection word);
6. shortest data field.
For purposes of this general overview it should be noted primarily that when a priority decision has been made at a node 54, a collision indication (referred to as Acol or Bcol) is returned along the path from which the losing transmission was received. This indication enables the transmitting microprocessor to recognize that the network 50 is busy with a higher priority transmission so that the transmission is terminated and must be retried again at a later time.
A simplified example is shown in the various representations of FIG. 2 of the manner in which the network 50 operates with the high speed random access memories in a tree using four different microprocessors, specifically an IFP 14 and three AMPs 18, 19 and 20. Ten subfigures 2A, 2B, . . . 2J each correspond to one of ten successive time samples, from t=0 to t=9, to show the distribution of different simplified (four character) serial messages from each of the microprocessors within the network at each of these points in time, and the communications between ports and microprocessors at the different times. The diagram labeled simply FIG. 2 shows the state of the system prior to the beginning of signal transmission. In these separate views, the null or idle state requires a transmission designated □. With the convention of lowest data content having priority, the message packet "EDDV" from AMP 19 in FIG. 2A should be the first to be transmitted through the system. These messages are retained, as described in greater detail below, in the high speed random access memories (sometimes H.S.RAM) 26 in the microprocessors. The H.S. RAMs 26 have input and output subdivisions that are depicted generally in FIG. 2, with the packets being arranged in FIFO vertical order in the output portion at t=0, thus being available for transmission, as indicated by the cursor arrow in H.S. RAM 26. At this point in time all transmissions in the network 50 indicate the null or idle state □.
At t=1, however, as designated in FIG. 2B, the first byte of each of the message packets is launched into the network 50 concurrently, with all nodes 54 still returning the idle state indications and all transmissions above the first tier also being in the idle state. In the first clock interval, the initial bytes of the messages are set into the lowest tier nodes, IN1 and IN2, so that at t=2 (FIG. 2C) contentions have been resolved and both upstream and downstream transmissions continue. Node IN1 has received an "E" on both input ports and is transmitting this upstream to the next tier, indicating the undecided state downstream to both sending processors. At the same tier, however, node IN2 has determined collision priority between the "E" from processor 19 and the "P" from microprocessor 20, in favor of the former, thus coupling port A to up-tree port C and providing the Bcol signal back to microprocessor 20. As the Bcol signal is returned toward the microprocessor 20, the IN2 node in effect locks the A input port to the C output port, so that the serial train from microprocessor 19 is transmitted on to the apex node IIN1.
At the IN1 node the first two characters are both "ED", and no decision can be made at this node at time t=2, as shown in FIG. 2C. At t=3 (FIG. 2D), moreover, the common initial character "E" from the three microprocessors 14, 18, and 19 reaches the IIN1 apex node and is redirected toward the downstream direction, as the second character "D", also common to all messages, is transmitted toward apex node IIN1. Node IN1 cannot yet make a decision at this time, but the third characters, "F", "E" and "D" from the successive microprocessors 14, 18, and 19 respectively are in the course of transmission to that node. Reception of the Bcol signal at the microprocessor 20 designates that its contention for priority has been lost, and it then and thereafter transmits only the idle indication □. The cursor arrows in the output buffers show that the microprocessor 20 has been returned to its initial state but that the other microprocessors continue to send successive characters. Thus at t=4 (FIG. 2E) the significant events are the decision for the port at node IN1 and the return transmission toward the first node tier of the initial character ("E") on all lines. The next collision is indicated at t=5 (FIG. 2F), with the B port of node IIN1 winning contention and Acol being generated.
Broadcasting of the serial signal train in the downstream direction continues through successive clock times, and at time t=6 (FIG. 2G) the initial message character is set into the input portions of all H.S. RAMs 26. Concurrently it should be noted that the earlier priority determination at node IN1 is now overridden by the Acol indication from the higher tier node IIN1 when the third character ("E") from the microprocessor 18 loses in contention with the third character ("D") from the microprocessor 19. As the cursor arrows show in FIG. 2H, microprocessors 14, 18 and 20 have returned to their initial states and winning microprocessor 19 previously completed its full transmission at time t=4. All input buffers are successively loaded with the priority message "EDDV" as seen in FIGS. 2H, 2I and 2J. At t=8 (FIG. 2I), the message has run out of the first tier and the apex node IIN1 has been reset at t=7, because only idle signals are in contention, as the last downstream character is transferred to the microprocessors. At t=9 (FIG. 2J) the nodes IN1 and IN2 in the first tier are reset, and all the losing microprocessors 14, 18 and 20 now contend again for priority on the network by emitting the first message character when the network is again indicating idle. In practice, as described hereafter, acknowledgment signals are transmitted to the winning microprocessor(s), but this is not required for the most general case of the invention.
The message, once broadcast to all microprocessors in this manner, may be used by any or all as required. This depends upon the mode of operation and the functions being performed, which include many variations.
The foregoing example of the manner in which the network prioritizes a given message out of a group of contending messages pertains to the transfer of primary data messages. A complex multiprocessor system must however use many other types of communications and commands to have the efficiency and versatility now required. The principal functions to be supplied encompass, in addition to primary data transfer, what may broadly be termed multiprocessor modes, message acknowledgments, status indications and control signals. The following section provides a general overview from the global, or multiprocessor system, standpoint as to how different modes and messages coact with the prioritized sorting and communication network. Reference should be made to FIGS. 8 and 13 and the accompanying descriptions hereafter for a more detailed understanding.
In the general distribution or broadcasting mode, messages are simultaneously delivered to all processors without specific delineation of one or more recipients. This mode is typically used for responses, status queries, commands, and control functions.
Where there is to be a delineation as to the recipient, the destination selection information within the message packet itself provides criteria for local acceptance or rejection of the packet. For example, interface logic in the receiving processor modules identifies whether the data is in range for their particular processor according to map information stored in the high speed RAM 26. A variety of selection criteria can be readily implemented by means of various settings of the map bits in the high speed RAM, including selection of a specific recipient processor, portion of the data base stored ("hased"), logical process type ("class"), etc. The use of broadcasting with local access control is of particular benefit for a data base management system, inasmuch as minimal overhead software is needed to gain access to any part of the widely dispersed relational data base or to dispersed local copies of any of a number of globally known logical processes. The system is thus capable of specifically selecting a single destination or a class of resources as the destination for a message.
Also, high level data base inquiries often require cross-referencing between different portions of the data base, and consistent reference to a given task. The TN incorporated in the messages provides this global transaction identity and reference, among other features. Many tasks may be worked on concurrently by the asynchronous local processor modules, and each task or subtask has its appropriate TN. Using various combinations of the TN, DSW and commands, virtually infinite flexibility is achieved. An extended sort/merge operation can be undertaken on a large number of tasks that are asynchronously assigned and processed. TNs can be assigned and relinquished and merges can be started and stopped. Certain messages, such as continuations, can have priority over other transmissions. Using the TNs and local processor updating of status as to the TNs, one query can determine the status of the global resource as to a given TN. A distributed update can also be accomplished in one communication. The present system enables all these functions to be performed without extending the software or materially increasing the overhead load.
As a consequence of the invention, multiprocessor systems with much larger numbers of processors than feasible in the prior art can be operated with high effectiveness against problem tasks. Because of the present low cost of microprocessors, systems of high performance in a problem domain, and not just in "raw" power, can be realized at low cost.
A coherent priority protocol that encompasses all message types, and various subtypes, embraces all the different messages that are applied to the network. Although responses, status and control messages are of a different form than the primary data messages they also use the contention/merge operation of the network and thus are prioritized during transfer. Response messages in the present system are positive acknowledgment (ACK), negative acknowledgment (NAK), or an indication that the processor does not have the resources to process the message meaningfully ("not applicable processor"--NAP). The NAK response may be any of several different types, indicating a locked, error or overrun condition. Because an originating processor or processors require such responses after termination of a message transmission, the responses have a higher priority level than primary data messages.
The present system also employs SACK (status acknowledgment) messages that denote the readiness state of a local processor with respect to a particular task or transaction. Such SACK responses are locally updated and held accessible to the network. They provide, in conjunction with the merge operation of the network, a single query global status report for a given task or transaction. Because the status responses are in accord with the priority protocol, the lowest data content response automatically gains priority and establishes the least ready status as the global system state for a transaction number in one uninterruptible operation. The SACK indications also are used in conjunction with certain primary messages to implement various protocols, such as system initialization and lockout operations.
The priority protocol definition for the various message types begins with the command code, using the initial 6 bits of the command word that starts each message and response, as shown in FIG. 11. An adequate range of distinctions as to message types, and subtypes, is available although more could be used. Here the SACK response differentiates seven different status levels (and provides a basis for prioritizing as well), as can be seen by reference to FIG. 11. For responses these first 6 bits are followed by the tag in the form of a 10 bit OPID (see FIG. 3). Both the TN and OPID can serve as further sorting criteria because of their differing data contents, within the tag.
After each primary message has been transmitted through the network, the interface section of every processor generates a response message, even if it is only a NAP. The responses also contend on the network, and the single or common winning response message is broadcast to all processors. Losing message packets are retried later, synchronously, after a minimal delay so that the network is substantially constantly in use. Where a number of processors provide an ACK response, the responses are sorted by the OPID.
As a consequence of the invention, tasks can be started, stopped, controlled, and interrogated in synchronism in a very large number of physical processors with a minimum of overhead. This permits the raw power of a large number of processors to be effectively applied to problem-state processing with a minimal diversion of that power to coordination and control. The overhead of coordination and control is a fundamental limitation on the efficacy of any distributed processing system.
Different types of control communications are employed where the purpose is globally (i.e. network) oriented. Thus, Stop Merge, Status Request, Start Merge, and certain task assignment and relinquishment messages have the same format as data messages and are also referred to herein as primary messages. These control messages also include the TN and have their places in the priority protocol, as is later discussed relative to FIGS. 10 and 11.
The term "global semaphore buffer system" has been adopted to connote the fact that the high speed random access memory 26 and control logic 28 shown in FIG. 1 also play a significant role in both multiprocessor mode selection and bidirectional communication of status and control indications. The global semaphore buffer system provides duality of access, in that both the high speed network structure 50 and the slower speed microprocessors can reference a message, response, control or status indication in the memory 26 without delay or requiring direct communication with each other. To this end the control logic 28 times multiplexes the memory 26 to network 50 and to the microprocessor in interleaved word cycles, creating in effect different ports having common access to the memory 26. The global resource or network 50 and microprocessors can use the transaction number as an address locater to a portion of the memory 26 devoted to transaction status. At the local level, the status of a subtask relating to a given transaction covering all useful states, is updated in the memory 26 under control of the microprocessor and locked by the control logic 28 at the buffer system. One of seven different readiness states is used, the entries conveniently being derived from a different dedicated portion of the memory 26. Upon a query from the network, the status of the processors is communicated (the "semaphore" is read) and prioritized in the network with the least complete readiness state taking priority. This arrangement provides an immediate hardware response from all processors to a query. Thus it can be known without delay or the use of software whether all of the distributed subtasks of a given task have been accomplished. In the instant system, moreover, any communicating processor module can assign an available transaction number for use with the messages and in each global semaphore buffer system.
A good example of this integrated use of transaction identity and status indication is presented by a complex merge operation, in which each of a number of processors is called upon to place in order all messages pertaining to a given criterion. In prior art systems each processor would have to receive and complete its tasks and then communicate the results to some "master" processor, which would do the final merge operation. That master processor thus constitutes a significant bottleneck to system throughput.
When the global readiness state establishes that all affected processors are ready, the messages of highest priority from the memory 26 at each processor are entered on the network concurrently and prioritized during merger as previously described. Successive retries with groups of messages generate a serial train of messages of descending priority, ending with the lowest for that transaction number. Specific command messages provide the system with the ability to suspend and resume the merge operation partway through so that the network 50 can be shared by a number of copending merge operations and thus make most effective utilization of the resources of the systems.
At any given time, therefore, all active processors connected to the network 50 can be working asynchronously on messages pertaining to different transaction numbers. When referenced to the same or "present" transaction number by a status query, all respond synchronously with one of the available status levels. For example, The START MERGE message tests the global semaphore represented by a particular transaction number, and if the global state is ready (SEND READY or RECEIVE READY), the present transaction number (PTN) is set to the TN conveyed in the START MERGE message. (If the global state is not ready, the PTN reverts to a value of TN0).
A STOP MERGE message also resets the present transaction number to 0. TN0 is thus utilized as the "default" transaction number used for single processor to single processor (point-to-point) messages. In another sense, it identifies the "non-merge" mode of operation.
The global intercommunication system uses the message organization shown in FIGS. 3A, 3B, 3C and 11, and the high speed random access memory 26 organization shown in FIGS. 8 and 10. More detailed examinations are made below in conjunction with FIGS. 5, 7, 9 and 13.
In FIGS. 3A-3C and FIG. 11 it can be seen that command codes for the responses range from 00 to 0F (hexadecimal) and that those for primary messages range from 10 (hexadecimal) to some higher value. Thus, responses take priority over primary messages, lowest value first, in the sequence shown in FIG. 11.
One dedicated section of storage in the high speed RAM memory 26" (FIG. 8), (designated "transaction numbers") is used for storage of the word formats (the seven readiness states, an Assign TN and an Unassigned TN state) of FIG. 12. Other dedicated portions of the memory 26" include a circular buffer for input (receive messages) and an output message space. Another separate section of the memory 26" is used as a message complete vector section, in which pointers can be placed to completed output messages so that output message space can be used efficiently.
It should be appreciated, therefore, that while the queuing and data buffering functions of the memory 26 and control logic 28 are of importance, the multiple coactions by which global transactions are dispersed and manipulated in relation to the individual processors are uniquely significant.
The active logic nodes 54 of FIG. 1 are alike, in both of the redundant networks, except that the recirculation node 54a at the apex of each network has no upstream port, but merely a signal recirculation path that returns to the downstream direction. As shown in FIG. 4, each node 54 may be broadly divided into functional groupings, one of which pertains to message and collision signal transmissions and the other of which pertains to generation and retransmission of the common clock signal. Clock signals are synchronized such that there is zero skew between them at the different nodes. These two functional groupings are not separate, inasmuch as the zero skew clock circuits form important parts of the signal transmission system. Both a word clock (two serial bytes) and a byte clock are utilized. Note should be taken of the fact that external control of the active logic nodes 54 is not required or utilized, whether to establish or reset the node's state or to set up different modes of operation. Furthermore, the identity between the nodes 54 enables them to be made in quantity using modern IC techniques, substantially reducing cost while improving reliability.
The A, B and C "ports" previously referred to each have ten input data lines and ten output data lines. Taking the A port as an example, the input lines are designated AI and the ouput AO. The single "collision" line is used at each port (e.g. Acol for the A port), along with upstream and downstream clock lines. The data lines from the A and B ports are applied to a multiplexer 60 which switches the priority word of two competing words, or the common word (if both words are alike) to an up register 62 coupled to the upstream port (C) as the C0 data signals. Concurrently, the downstream data received at the C port from a higher tier node is shifted into and out of a down register 64, appearing as output at both of the A and B ports.
Although one upstream byte serial signal train may be blocked, no added upstream or downstream delay is introduced and words are advanced in unbroken sequence through the up register 62 and down register 64 under control of the word and byte clocks.
Competing bytes concurrently applied at the A and B ports are supplied to first and second parity detectors 66, 67 and also to a comparator 70 which determines priority on the basis of the eight data bits and one control bit, with lowest data content having priority. The "idle" or no message signal in this protocol is an unbroken sequence of 1's. Parity errors can occur due to typical causes, such as the presence of excessive noise or some other factor affecting signal transmission or circuit operation. In the present system, however, an important additional use is made of parity error indications. Each transition of a microprocessor to an inoperative state is marked by all output lines, including the parity line, going high (or 1 valued), thus establishing an odd parity error. This indication is transferred through the network once upon the presence of an error, as a marker which enables the system to identify a change in global resources and initiate procedures to determine the nature of the change.
The pair of parity detectors 66, 67 and the comparator 70 feed control circuits 72 that include priority message switching circuits 74, responsive to the comparator 70 for locking the multiplexer 60 in one state or the other if priority is determined, and for generating and propagating the downstream collision signals. Transitional parity error propagation circuits 76 are so called because they force the one-time all 1's parity error state along the network. Reset circuits 78 for returning the node to its initial state include an end of message (EOM) detector 80.
It will be appreciated that the functions described above and hereinafter may be accomplished at each active logic node by the use of a microprocessor chip, but they may even more readily be implemented in accordance with the state diagram of FIG. 5 and the logic equations set out below. In the state diagram, the state S0 represents the idle state, and also the state in which competing messages are equal, so that no decision is made to favor one port against another. The S1 and S2 states are the states favoring the A port and B port respectively. Thus the A port is favored (S1 state is established) if the data content of BI is greater than AI and there is no parity error on AI or if there is a parity error on BI (these conditions being designated AIPE and BIPE respectively and represented by flip-flop states). The converse logic conditions as to AI and BI exist for the system to go into the S2 state. Any indication from a higher tier node that a collision has occurred at that tier is reflected back in a downstream signal as COLIN. Whether the system is in the S0, S1 or S2 states, it goes into the S3 state, transferring the collision signal downstream as Acol and Bcol. In the S1 and S2 states, with the node having made a decision, the collision signal is sent downstream to the lower tier nodes in like fashion, with the priority message switching circuits 74 locked to the A port or B port as the case may be.
The reset circuits 78 include the EOM detector 80, used to reset the node from S3 to S0 (FIG. 5). A first reset mode uses the end of message (EOM) field that concludes the data field in a primary message, as shown in FIG. 6. A group of flip flops and gates are used to establish the logic:
where URC represents the control bit in the up register, URINC represents the control bit value in the up register input and URCDLY represents the C value in an up register delay flip flop.
As seen in FIG. 6, control bit sequence pairs establish certain fields and transitions between them. For example, a transition from the all 1's used during idle to a 0, 1 bit sequence defines the start of a field. The same 0, 1 sequence defines the start of a field. The same 0, 1 sequence is used to identify the start of the data field. Successive 1, 0 control bit strings denote the internal field or subfield, and the end of message (EOM) is identified by the 0, 0 control bit pair. The condition in which the string of 1, 0 pairs is followed by the 0, 0 pair is unique and readily identified. The URINC, URC and URCDLY signals ane ANDed together, with each having a 1 byte clock delay from the other. The result is a waveform that is high until the start of the message packet, and at which point it goes low and stays low through the data. It returns high 2 byte clocks following the EOM occurrence. This positive-going transition in the waveform URINC·URC·URCDLY is the EOM detection. It triggers, as shown by the legend in FIG. 5, a return from S1 or S2 to S0.
A higher node tier that is reset goes to COLIN, indicating that the collision state has been removed. This logic state initiates a return from S3 back to the base state, S0. Note that the COLIN state will propagate down the tiers of the network as the end of the message "runs out". The nodes are thus self-resetting no matter how long or short the message. Also note that no matter the state in which the network starts out, all nodes will be reset to the S0 state by the idle signals.
Collision signals are returned to the processor modules, which store the collision state information and revert to the transmission of the idle sequence as the winning processor continues to transmit. A processor may begin a new transmission as soon as it detects the transition from COLIN to COLIN. In addition, a processor may begin a new transmission after receiving idles for 2N byte times, where N is the number of tiers in the network, as this also indicates that the network is clear of any prior transmissions. This latter method of enabling new transmissions permits a processor entering a network for the first time to get into message synchronism with the network under conditions of light traffic, so that it need not wait for a poll from another processor in order to start interchange with other processors on the network.
Parity error states have been noted in the state diagram of FIG. 5 and are established pursuant to the following logic:
If PESIG then (URIN 0:7, C, P=1 . . . 1, 1, 1) to implement this logic, the transitional parity error propagation circuits 76 comprise an AIPE, or A input parity error flip flop and a delay flip flop (AIPEDLY). The latter is set 1 byte clock later in accordance with the AIPE setting. For A inputs, the PESIG value thus goes high for 1 byte clock when the AIPE flip flop is set by a parity error, so that the PESIG signal is propagated once, at the first indication of the parity error. The same condition arises when all of the data bits, control and parity bit are 1 values, which occurs at the previously noted transition in the state of the global resources. All lines then go high, forcing all 1's and establishing an even total (odd parity) so that the AIPE and AIPEDLY flip flops are set as previously described, to denote the parity error. This system operates in the same way when the message packet received on the B port contains a parity error or a forced parity indication of change of status.
Parity errors arising because of noise effects or other variables will typically not affect processor operation because of the redundant networks. For monitoring and maintenance purposes, indicator lights (not shown) are utilized to indicate the occurrence of parity error. The once-propagated parity error denoting change of status, however, initiates routines for assessing the significance of the change.
The clocking system used in the node 54, as shown in FIG. 4, provides a unique means for maintaining zero skew between the clocks at all the node elements, despite the number of tiers used in the network. The clock circuits 86 include first and second EXCLUSIVE OR gates 88, 89 respectively, the outputs of which, designated A and B, respectively, are subtractively combined (in the B-A sense) by a summing circuit 92, the output of which is passed through a low pass filter 94 to control the phase of the output from a phase locked loop or oscillator 96. The inputs to the first gate 88 are the output of the PLO 96 and a downstream clock passed from the next higher tier node element through an isolating driver 97. This line is designated as the word clock, and is derived from the next higher tier after a certain known delay, τ, the same signal being returned through another isolating driver 98 to the node at the next higher tier. The inputs to the second gate 89 comprise the word clock and a clock feedback from the next lower tier, which also receives a signal from the PLO 96.
The word clock line feeds the two inputs of a third gate 100, both directly and through a τc delay line 101, to derive a byte clock signal at twice the frequency of the word clock and in timed relation to it.
The functioning of the clock circuits 86 may be better understood by reference to the timing diagram of FIG. 7. The clock out signal is the output of PLO 96. Inasmuch as a paramount objective of the system is to maintain a zero time skew between these outputs for all nodes in the network, it is clear that they must also have the same nominal frequency. The transmission line delay, τ, between nodes is kept substantially constant, but can be long. Using the presently disclosed technique the length could be as long as 28 feet, with the network and node byte clock rates (nominally 120 ns.) used in a practical system. Those skilled in the art will recognize that lengths which are integer multiples of 28 feet can readily be obtained by adding tiers to the network which are not fully populated with the maximum possible number of processor modules. There will be a corresponding increase in the latency or transmit time through the network.
The word clock derived from the next higher tier, as shown by the next lower waveform, is a similar waveform but delayed by 96 . The word clock constitutes the basic timing reference throughout all the nodes, and this is made possible because the leading edge of each clock out signal is controllable within the circuit and can be made to lead the word clock so that all nodes can be held in synchronism. Referring to the waveforms A and B, it can be seen that the first gate 88 generates a pulse A which terminates with the leading edge of the word clock, while the second gate 89 generates a pulse B whose leading edge is coincident with the word clock. The trailing edge of the B pulse is defined by the initiation of the feedback pulse from the next lower tier mode, which is delayed by τ, so that the B pulse is of fixed duration. The clock circuits 86 function to keep the pulse A of the same duration as pulse B, because the summed signal, B-A, tends toward a null, as the PLO 96 is advanced in phase so as to establish synchronism. In effect, the leading edge of the A signal, which may lead or lag the desired position as shown by dotted lines, is adjusted to precede the leading edge of the word clock by the interval τ. When the leading edge of the clock out signal is in this desired nominal position at all the nodes, there is zero skew between the word clocks. For this reason the processors coupled to the network are freed from any constraints as to the total length of the path between one processor and another, because additive delays and differential propagation times are eliminated.
To produce the double frequency byte clock, the word clock signal is replicated at a delay τc by the delay line 101, which also feeds the gate 100. Thus, as seen in the waveform labeled byte clock in FIG. 7, at either edge of the word clock, a byte clock pulse is produced having a duration τc. This occurs twice each word clock interval and in synchronism with the word clock throughout all the nodes. It is implicit in the prior description that the delays introduced by the transmission lines between nodes are nearly identical in both directions between tiers so that in effect all word clocks and byte clocks within the system are held in stable phase relationship. The locally generated byte clocks therefore provide clocking at each node for the individual bytes in the 2 byte words of the messages.
The active logic nodes are of potential benefit wherever a competition between concurrent message packets is to be resolved on the basis of data content. Most known systems, as exemplified by U.S. Pat. No. 4,251,879 issued Feb. 17, 1981 on a "Speed Independent Arbiter Switch for Digital Communication Networks" are directed toward determining the first signal received in time, and utilize external processing or control circuits.
The individual processors in the overall system diagram of FIG. 1 are identified as examples of interface processors (IFPs) 14 and 16 and access module processors (AMPs) 18 to 23 respectively, and are broadly subdivided into principal elements. A more specific example of the organization of the processor modules shows the correspondence to the broad functional subdivisions of FIG. 1 but also reveals a substantial number of further subdivisions. As used herein, the term "processor module" refers to the entire assembly shown in FIG. 8, which with the optional features that are noted can serve either as an IFP or an AMP. The term "microprocessor system" refers to a system 103 that incorporates a microprocessor 105 such as a 16 bit microprocessor of the Intel 8086 type. The address and data busses of the microprocessor 105 are coupled within the microprocessor system 103 to conventional peripheral systems, such as the main RAM 107, and a peripheral controller 109. The peripheral controller 109 exemplifies what may be used when the processor module is an AMP and the peripheral unit is a disk drive 111. As shown in the dotted line rectangle, however, this controller or interface may alternatively be a channel interface if the processor module is to serve as an IFP. In this instance the channel interface would communicate with the channel or bus of a host system. Inasmuch as conventional controllers and interfaces may be used in the microprocessor system 103, they need not be further described.
It is noteworthy that it can be shown to be advantageous to use one disk drive per microprocessor, in terms of both cost and performance. This is true as to data base machines in general, even though there may be benefit at times in arranging one microprocessor so as to have access to a number of secondary storages. The diagram omits, for purposes of brevity, the incorporation of other subsystems that would typically be used, such as interrupt controllers that are supplied by semiconductor manufacturers for use in conjunction with their systems. Those skilled in the art will recognize the importance of a suitable scheme for distribution of electrical power to the processor modules to attainment of the full degree of redundancy and reliability the invention can provide.
The peripheral controller 109 and the channel interface depicted as an option in the microprocessor system 103 correspond to the IFP interface and disk controller in FIG. 1. The high speed RAM 26 of FIG. 1, however, actually comprises first and second H.S. RAMs 26', 26" respectively, each of which through time multiplexing is effectively a three-port device coupled to the microprocessor bus system at one of its ports (designated C). Each of the H.S. RAMs 26', 26" cooperates respectively with a first or second network interface 120, 120', providing communication with the first and second networks 50a and 50b (not shown in FIG. 8) respectively at an input (receive) port A and output (send) port B. With these redundant systems, only the second network interface 120' and the second H.S. RAM 26" need be described in detail. The network interfaces 120, 120' are further shown and described in conjunction with FIG. 13, but can be generally subdivided into four principal parts:
Input register array and control circuits 122 coupling the ten input lines from the second network 50b to the A port of the H.S. RAM 26" via an interface data bus and address bus.
An output register array and control 124 coupling the output lines of the second network 50b to the interface data and address busses and to the B port of the second H.S. RAM 26".
A microprocessor bus interface and control 126 coupled to the interface address and data busses and to the A and B ports of the H.S. RAM 26".
A clock generator 128 that receives the word clock from the network and generates synchronized, properly phased clocks for controlling the interface 120'.
The second network interface 120' and H.S. RAM 26" cooperate with the microprocessor system 103 in coordinating data transfers between the high speed network and the relatively slower speed microprocessor and also provide queuing of messages between these different systems. The microprocessor bus interface and control 126 may be referred to as performing read/write (R/W) functions with the microprocessor system which (at least with the Intel 8086) has the capability of writing directly into and receiving data from the H.S. RAM 26".
Although the IFP and AMP systems are functionally alike, there can be a substantial disparity in the sizes of the incoming message storage and outgoing message storage in the H.S. RAM 26", as between the IFP and the AMP. In a relational data base system, the IFP has a large incoming message space in the H.S. RAM 26", in order to receive new messages from the high speed network so that the needs of the host computer may be serviced by constant usage of the network. In the AMP the reverse is true, because more storage space should be available to send processed message packets to the high speed network. The H.S. RAM 26" functions with the main RAM 107 in the microprocessor system 103, which has message buffer sections for each network.
The allocation of system address space in the main RAM 107 for the microprocessor system 103 is shown in FIG. 9, to which reference should briefly be made. It is conventional in having addresses devoted to system random access functions to provide an expansion space for use in the event the random access capacity is increased, an I/O address space and an address space reserved for ROM and PROM (including EPROM) functions. In addition, portions of the system address space are reserved for message packets from and to the first and second high speed RAMs 26', 26" respectively. This provides greater flexibility in the system operation, inasmuch as even though the microprocessor 105 can address the H.S. RAMs 26", the main RAMs 107 assure greater freedom from software and hardware interdependence.
It has been stated, referring again to FIG. 8, that the bidirectionally accessible H.S. RAMs 26" are organized in such fashion that they perform central functions in multiprocessor mode control, distributed updating and the management of message packet flow. For these and other purposes, the H.S. RAM 26" is divided into a number of different internal sectors. The relative disposition of the different sectors shown in FIG. 8 is used throughout the different processor modules in the system, and the specific addresses that designate the limits of the sectors refer to those used in an actual system. It will be appreciated that the sizes of these sectors of memory and their relative disposition are widely variable dependent on the specific system context. Sixteen bit memory words are employed in this example. The selection map and response directory are dedicated lookup tables of the type that may be written in once during initialization, while the transaction number section provides a dynamically revisable lookup table.
The selection map section of memory starts with location 0 but is based upon the use of four different maps used in interrelated fashion within the memory section. The destination selection word (DSW) that is contained within the message packet is used cooperatively with the dedicated selection maps in the H.S. RAM 26". The destination selection word, comprising 16 total bits, has a map address in 12 bit positions, and map selection data in the four other bits. Each of the first 1024 16 bit memory words of the H.S. RAM contains four map address values. The address value specified by the DSW provides, with a single memory access to the H.S. RAM, map bits for all four maps, while the map selection bits in the DSW determine which map is to be used.
FIG. 15 shows the conceptual organization of the map section as if each map had physically separate 4096-by-1-bit RAM. As a matter of implementation convenience all map data is stored in a single portion of the H.S. RAM, as shown by FIG. 8. The DSW Management Section 190 (FIG. 13) controls multiplexing of four bits from each of the four maps of FIG. 15 from one 16-bit word of H.S. RAM. Those skilled in the art will recognize the advantage of the scheme in that the maps can be initialized by the processor by the same means as used to access other parts of the H.S. RAM.
There are also three different classes of destination selection word that are used, and the selection map locations are correspondingly divided into a hash selection portion, a class selection portion and a destination processor identification (DPID) selection portion. The DPID specifies whether the processor 105 is the specific one for which the message packet is intended, whereas the class selection portion specifies whether or not the processor is one of the number of processors in a particular process class that is to receive the message packet. The hash values are stored in accordance with the manner in which the data base is distributed throughout the relational data base system, following a predetermined algorithm for the particular relations and method of scatter storage that are employed. The hash value in this instance can designate the processor either as having primary or backup responsibility for the data. Thus the selection maps provide a technique for directly addressing the H.S. RAM 26" so as to determine processor destination. This function complements the broadcasting of prioritized messages to all network interfaces 120' and enables local accessing without interruption of microprocessor 105 status.
A separate section of H.S. RAM 26" serves as a pivotal means for checking and controlling globally distributed activities. Transaction numbers (TNs) are assigned to various ones of the processes that are sent on and received from the network 50b, as discussed above and shown in FIG. 3. TNs within messages are retained as global transaction identities as each microprocessor system 103 independently performs the subtasks accepted by it. The block within the H.S. RAM 26" that is dedicated to a number of available transaction number addresses contains status entries that are locally controlled and updated by the microprocessor system 103 as these subtasks are performed. The TN is used in a number of different ways, both locally and globally, in performing intercommunication functions. The transaction number is used to identify subtasks, to call forth data, to provide commands, to control message flow and to characterize the dynamics of a global process. Transaction numbers may be assigned, relinquished and changed in the course of global communication. These aspects are explained more fully in the following description.
The most complex, but perhaps the most dramatic, aspect of the TN is the capability it affords, with the sort network, for distributed updating of the status of local processors as to a given control process. Each control process (i.e., task or multiprocessor activity) has its own TN.
Readiness state values are held in the transaction number section of H.S. RAM 26" and are locally modified under control of the microprocessor system 103. The microprocessor 103 can initialize the appropriate entry (e.g. SACK/Busy) in the response directory (address 050D (hex)) of FIG. 10, and enter the SACK/Busy status by transferring the exact image thus reproduced to the H.S. RAM 26". An entry at a TN address is accessible to the network 50b via the interface 120', at the A and B ports of the H.S. RAM 26". Queries are made using a Status Request message containing the status request command code (see FIG. 11) and TN. The interface 120' uses the content of the designated TN to reference the response directory which contains a properly formatted response message. A global status query as to a given TN, when received at the second network interface 120' elicits a direct response that is solely hardware controlled. No prefatory communication is needed, and the microprocessor system 103 is not interrupted or affected. However, the microprocessor 103 can assure against interruption when setting the status by transmitting a LOCK indication to the interface 120', which communicates the Lock word derived from 0501 (hex) until removed at a later time.
The word format of the readiness states is shown by the seven states from "busy" to "initial" in FIG. 12, which depict the useful variants employed in a practical system. More or fewer status variants may be used, but these seven states provide versatile and comprehensive control. It is the responsibility of the microprocessor system continually to update status levels for different TNs in the H.S. RAM 26" to reflect availability for, or progress toward the completion of a subtask. Such updates are made simply by writing into the TN address in the H.S. RAM 26", using the formats shown in FIG. 12.
In FIG. 10 each status response is accompanied by an initiating status acknowledgment command code (SACK), from 05 to 0D (hexadecimal). The SACK responses sent to the network are essentially the command codes of FIG. 10, the numeric portions of the word formats of FIG. 12, and an originating processor ID (OPID), as seen in FIG. 11. The SACK responses thus define a consecutive priority subgrouping within the overall coherent priority scheme shown in FIG. 11. The OPID is significant in the priority scheme, because if a number of processors are working on a TN but are "Busy", the highest priority message that is broadcast is determined by the OPID. Transfers and system coordination can be based on this data.
The SACK message priority schedule, the simultaneous responses from a number of microprocessor systems 103, and the dynamic prioritizing in the network 50b, enable the status of global resource as to a given task to be determined in a vastly improved manner in comparison to prior art systems. The response given is unambiguous, cannot represent an invalid state and requires no software or local processor time. Thus Deadlock cannot arise due to repeated requests interfering with task performance, for example. Numerous multiprocessor options can be used at the different status levels. It is unique that the local processors can continue to operate independently and that a single query derives a global, prioritized, response.
Some specific discussion of the successive states depicted in FIG. 12 may be useful. The "busy" and "waiting" states connote successively more complete phases as to the assigned subtask, the latter identifying a condition in which a further communication or event is required. These states exemplify the "elevation" of the status of the TN until it reaches a level at which a message packet corresponding to the TN can be sent or received.
When a message packet is to be sent or received, however, a different feature of the TN comes into play, namely its capability for message control. When the microprocessor system 103 has a message for transmission, the status indication becomes "send ready". The microprocessor system 103 not only updates status but it also enters a "next message vector" value in the H.S. RAM 26", using the word format of FIG. 12. This entry defines the location at which the corresponding output message may be fetched from H.S. RAM 26". This vector is used internally in the network interface 120' in chaining together output messages pertaining to a specified TN.
A related function is performed during the "receive ready" state, in which the TN storage location retains an input message count from the microprocessor system 103 as to the number of messages that may be received pertaining to a given TN. This count can be decremented until reduced to zero as successive input messages are transferred. At zero, no more messages can be received and an overrun condition can be indicated. This enables the TN to be used in pacing transfer between the network 50b and the microprocessor system 103.
Locally, at each processor the TN is retained in the send and receive messages during processing, as a constant and uniform reference throughout the system. The TN0 or default state also provides a local command to identify the fact that a message is to be used in a non-merge mode.
From the global standpoint, moreover, the distinction between TN0 and TN>0 values establishes one of the command functions for which the TN is used. The merge/non-merge characterization thus inherent in each message packet, provides a valuable systems approach to prioritizing and sorting messages. Similarly, the "Assigned", "Unassigned", "Non-Participant" and "Initial" status are used to fulfill global intercommunication and control functions. The "Unassigned" state is one in which the processor has previously relinquished a TN, so that it must receive a new primary message reactivating the TN. If the processor indicates "Unassigned" when it should be "Assigned", this establishes that the TN was not properly entered and that corrective action should be taken. When a TN is "Assigned" where it should be "Unassigned", this may indicate a faulty transfer or a competition between two processors for a new TN. Neither "Assigned" nor "Unassigned" is treated as a readiness state, inasmuch as the processor has not yet undertaken work on the TN at these stages.
The "Initial" and "Non-Participant" states are also significant in global resource terms. A processor which comes on line and which therefore must be brought into the system is in the "Initial" state, which indicates that administrative steps are needed to bring the processor on line. Those processors which are "Non-Participants" in a given task do not need to do any processing locally, but must keep track of the TN so as not to inadvertently use it in an erroneous manner.
The dedicated directory or reference section of the H.S. RAM 26", referring again to FIG. 10, also includes other types of prioritized messages for use in generation of responses by hardware. NA (not assigned) entries are held available for future use. Three different types of NAK responses (Overrun; TN Error; Locked) are of lowest data content and at highest priority levels because they identify error conditions. The SACK responses are followed, in order of decreasing priority, by the ACK response and the NAP (not applicable processor) response. In the present implementation, two response command codes are not assigned (NA) and are available for future use. This directory can be initialized by software and is used by hardware to quickly and flexibly generate any of the range of response message texts.
A separate portion of this directory is used to store TOP, GET, PUT, and BOTTOM addresses or pointers related to the functioning of circular buffers for input messages and completed output message pointers. These pointers function in conjunction with the dedicated sectors of H.S. RAM 26" devoted to input message management and output message management respectively. For incoming messages, a circular buffer scheme is used, with "TOP", stored in the directory section of the H.S. RAM 26", being a variable address defining the upper position for incoming messages. The PUT address, also stored in the directory section, defines where the circuits are to store the next message that is received. The GET address is provided and kept updated by software to enable the hardware to recognize the location at which the software is emptying the buffer.
The incoming message buffer is managed by setting PUT at the bottom of the buffer and starting with the GET address equal to TOP. The rule of operation assured by software is that GET is not set equal to PUT, which would create an ambiguous condition. As messages are entered into the incoming message buffer in H.S. RAM 26", the message length value in the message itself establishes the beginning point of the next message and the PUT address stored in the directory is then changed to indicate where the next succeeding message is to be received in the buffer. Incoming messages can thus be fetched by the microprocessor system 103 as its capabilities permit.
Data in the output message space within the H.S. RAM 26" is utilized in conjunction with the output message complete vectors held in a separate circular buffer and the next message vector in the H.S. RAM 26". Messages can be assembled and stored in arbitrary locations, and related messages can be chained together from transmission on the network. In the directory section of the H.S. RAM 26", TOP, BOTTOM, PUT and GET addresses are entered and updated as previously described to maintain active present references to locations within the output message complete buffer. The message complete vectors constitute addresses which reference messages in the output message space that have been successfully transmitted as indicated by a response received. As described below, the system enables the microprocessor system 103 to enter output messages readily, but to handle complex linkage vector sequences in orderly fashion so that output message space is efficiently used and message chains can be transmitted.
The protocol of FIG. 11, which was previously discussed as to responses, is continuous with respect to the primary messages as well. Response messages are given in sequence, the hexadecimal command codes being stated in ascending order. In the primary message grouping, the stop merge (also the base or non-merge control) message is of lowest data content and highest priority. This message constitutes a control communication that terminates merge mode within the network and at the processor modules.
A substantial number of different types of primary data messages can be used in ascending priority, and can be categorized in priority order based upon application and system requirements. As mentioned, continuation messages can have higher priority so as to maintain continuity with the preceding message packet to which they relate.
The last grouping of four primary messages in FIG. 11 comprise, in descending order of priority, the status request message, which is the only type of status message needed to obtain the status response, control messages calling for "relinquish TN" and "assign TN", and, of lower priority, a "start merge" control message.
This system permits versatile operation, as will be evident from the more detailed examples given hereafter. A processor module operates on a present transaction number (PTN hereafter), whether this is externally commanded from the network or generated internally in the course of successive operations. When merge operations are being carried out, the processor modules utilize the global reference or transaction identity defined by the TN. Starting, stopping and restarting of merge operations utilizes only simple message changes. When subtasks do not require messages to be merged, or message packets are generated that have no specific relationship to other messages, they are queued to an output against TN0 and are transmitted when the base or default condition defined by Present Transaction Number (being 0), holds true. TNO condition enables messages to be queued for transmission whenever a merge mode is not utilized.
FIG. 13, to which reference is now made, depicts in further detail one example of interface circuits useful in systems in accordance with the invention. This section of the description includes a number of detailed features that are not necessary to an understanding of the invention but are embedded in a practical system example and are therefore included to place the examples more firmly in context. Specific gating arrangements and details not the subject matter of the invention and involving well known expedients for which many alternatives are available have been omitted or abbreviated. FIG. 13 is an elaboration of the second network interface 120' and the H.S. RAM 26" from FIG. 8. The interfaces 120 for both networks function in like fashion and thus description of one will suffice.
In FIG. 13, inputs from the particular active logic network 50 associated with the interface are applied at network message management circuits 140 via a multiplexer 142 and known parity check circuit 144. The multiplexer 142 is also coupled to the microprocessor system data bus, enabling access to the message management circuits 140 via the bus. This feature permits the microprocessor system to operate the interface in a step-by-step test mode, transferring data as if the interface were on line to the network. Inputs from the networks are applied to a receive network data register 146, both directly in a first section and through a receive byte buffer 148 which thereafter enters the byte into a different section of the receive network data register 146. Consequently, both bytes of each word received are entered into and held available at the receive network data register 146.
Output messages for transmission are entered into a send network data register 150, while a parity bit is added in a conventional parity generator 132. Messages are sent to the associated network from the network message management unit 140, or (where the test mode is to be used) to the microprocessor system data bus. For message management purposes within the interface, the send message format in the random access memory 168 comprises identifying data as well as message data. As seen in FIG. 21A, command, tag, key and DSW can all be incorporated along with primary data that is to be transmitted.
The organization shown in FIG. 13 is essentially the same as that shown in FIG. 8, which illustrates the interface data bus and address bus as separately coupled to input ports A and B at the H.S. RAM 26', while the address and data busses of the microprocessor system 103 are illustrated as coupled to a separate C port. In actuality, as seen in FIG. 13, this separate bidirectional access is achieved by time division multiplexing of input and output address functions within the interface and at the H.S. RAM 26". The microprocessor data and address busses are coupled to the interface busses via gates 145, 149 respectively so that the microprocessor can operate asynchronously on its own internal clock.
The timing system used is based upon clock pulses, phase control waveforms and phase subdivision waveforms generated by interface clock circuits 156 (FIG. 13) and having the timing relationships shown in FIG. 14, to which reference is also made. The interface clock circuits 156 receive the network word clock from the nearest node and a phase locked clock source 157 includes means for maintaining zero time skew as previously described in conjunction with FIG. 4. The nominal network word clock rate of 240 ns. in the network is subdivided in time in the interface clock circuits 156 because a frequency multiplier (not shown in detail) held in phase locked relationship provides a faster clock defining reference period of 40 ns. duration (shown in FIG. 14 as PLCLK). The basic word period is defined by the opposite-going half cycles of a cyclic signal designated CLKSRA having a total 240 ns. duration. Two other signals of like frequency and duration are generated from PLCLK by frequency dividers 158 at times delayed by one and two cycles of PLCLK respectively from CLKSRA, and these are designated CLKSRB and CLKSRC respectively.
From these signals, control logic 159 develops timing waveforms, designated IO GATE, RECV GATE and SEND GATE, denoting successive equal thirds of the word period. These intervals are appropriately referred to as IO, receive and send phases. The phases defined by the gate signals are each further subdivided into two equal half intervals by IO CLK, RECV CLK and SEND CLK signals which define the last half of each of the phases. Byte clocking functions are governed by BYTE CTRL and BYTE CLK signals.
The IO, RECV and SEND phases provide the basis for time division multiplexed operation of the random access memory 168 and the microprocessor system busses. The interface can receive or send no more than one word per word period from or to the high speed network, and receiving and sending are obviously never concurrent. Transfer rates to and from the microprocessor system are substantially lower, but even if equal the capacity of the interface circuits would not be taxed. The interface system arrangement hinges in large part on direct access to the random access memory 168, and substantially obviates the need for internal processing or software. Thus as the system cycles through the successive phases in each word period, words are successively advanced in non-conflicting progressions along their predetermined signal paths for the different functions taking place. For example, sending a message to the bus may be interleaved with reception of a message from the microprocessor, each being interchanged using a different portion of the memory 168.
Intercommunication between the data bus for the microprocessor system and the network interface is effected in IO (which may also be referred to as Read/Write) management circuits 160. A write gate 162, for words from the microprocessor system, and a system read register 164, for transferring words to the microprocessor system provide the coupling between the microprocessor's bus and the bus interface to the network interface.
A memory address register 165 and parity generator and check circuits 166 are also incorporated in the network interface subsystem. In this example the high speed storage comprises a 4K word×17 bit random access memory 168, the internal subdivision of which and the use of dedicated memory portions within which have previously been described. The size of the random access memory can readily be reduced or expanded to meet the needs of a particular application.
Receive message buffer management circuits 170 are coupled to the data bus of the microprocessor and in turn are coupled to the address bus for the memory 168. The term "received messages" refers both to the incoming messages from the network for entry into the circular buffer at a location referred to as PUT and to the subsequent transfer of that message to the microprocessor system when a GET value specifies where the system is to sequence in extracting a received message for transfer to the microprocessor system. Address values for accessing the random access memory 168 are entered into a GET register 172, a TOP register 174, a PUT counter 175 and a BOTTOM register 176 respectively. The PUT counter 175 is updated by incrementing from an initial position defined by the BOTTOM register 176. The TOP register 174 provides an opposite limit reference. Both TOP and BOTTOM may be manipulated by software control to modify both the size of the receive buffer and the absolute location with H.S. RAM. When the contents of the PUT register equal the contents of the TOP register, the PUT register is reset to the contents of the BOTTOM register, thus effecting the circular nature of usage of the buffer. The GET, TOP and BOTTOM registers and the PUT counter are shared in managing both the incoming message and output message complete circular buffers.
Entries are made in the GET register 172 under software control, because the length of the then active message in the buffer determines the next address. Comparison circuits 178, 179 coupled to the outputs of the GET register 172, the PUT counter 175 and the TOP register 174 are used in detecting and indicating overrun conditions. An overrun exists when the GET and PUT settings are set equal or when GET is attempted to be set greater than TOP. In either instance an overrun status indication is to be sent until the condition can be corrected.
The concatenated manner in which the "receive message" circular buffer is arranged and operated is particularly useful in the present system. Hardware management of PUT and dynamic management of GET can be employed with cross-checks being available to avoid conflict. However, other buffer systems may be employed, although perhaps at some added expense in circuitry and software. The receive message format in memory 168 also, referring now to FIG. 21B, contains identifying data in the form of map results, data length and key length, derived as described hereafter.
A DSW management section 190 within the interface includes a destination selection word register 192 into which the destination selection word is entered for transfer to the address bus. In using the DSW to address the dedicated DSW section of the memory 168, the output on the data bus, from the memory, returns data from which the DSW management section 190 may also determine that the message packet is appropriate for the processor. It will be noted from FIG. 13 that the Destination Selection word comprises 2 bits of map nybl address, 10 bits of map word address, and 4 bits for map selection. The "nybl" address is used to delineate a subsection of a word from memory 168. The 4 map selection bits are applied to a map result comparator 194, which receives relevant map data from the memory 168 via a multiplexer 196. The multiplexer 196 receives 16 bits, representing 4 different map data nybls stored at the address defined by the 10 map word address bits in the DSW. The memory 168 is specifically organized in comparable fashion in the dedicated map section to facilitate this comparison. The appropriate one of the four map nybls is selected by the 2 remaining bits in the DSW, applied to control the multiplexer 196. A comparison is made, and the resulting map code is entered in the map result register 197 and inserted in the incoming message entered in the memory 168. If the comparison shows that a "one" bit is not present in any of the selected maps, a "reject" is generated to indicate that the processor module is not intended to receive the message packet.
Referring to FIG. 15, there is shown in general form an advantageous way to subdivide the memory 168 in the dedicated destination selection portion and to make the map result comparison. Each map is organized as 4096 words×1 bit, and further subdivided (see FIG. 8) into specific processor ID, class ID and hashing sectors. Using the 12 address bits (10 address and 2 nybls) the common map address is selected and a 1 bit output is derived from each map. (The multiplexer and nybls of FIG. 13 are not shown for simplicity in FIG. 15). The four parallel bit outputs can be compared to the 4 map selection bits in a group of four AND gates 198, so that if one or more compare, the output of an OR gate 199 goes true. The map result can be entered in the map result register 197 of FIG. 13 and the message can be accepted in the memory 168. Alternatively, the message is rejected and a NAK is transmitted.
The command word management section 200 includes a command register 202 that receives the command word. The TN field of the command word has access to the address bus so that the referenced receive TN may be examined to determine the proper response message (see FIG. 18). In addition, during a Start Merge command, a data path exists from the TN field to the PTNR 206 in order that the PTN value may be changed in conjunction with a Start Merge command.
The incoming messages entered into the memory 168 also include, as discussed relative to FIG. 21, for address vector purposes, the value of the length of the data field and the key field, if these fields are used. These values are derived by a receive data length counter 210 and a receive key length counter 211, each of which counts the sequence of words in the appropriate field as the fields are presented by the input source.
A send message management section 220 is also used to encompass the functions of accepting processed packets for memory 168 and transferring them to the network at a later time. This section 220 comprises a send transaction vector counter 222, a send data length counter 224 and a send key length counter 226 coupled bidirectionally to the data bus. The send transaction vector counter 222 is coupled to the address bus, while the send data length counter 224 is coupled to an address generator 228 which is in turn coupled to the data bus. The output buffer section and the circular buffer comprising the output message complete vector section of FIG. 8 are both used in sending messages. In this instance, however, message packets are entered serially, but then fetched in a sequence defined by the vectors.
Within the interface, the separate operating phases are carried out at mutually exclusive times, and this time sharing permits the memory 168 to receive and supply network message packets at the network clock rate, operate internally at an effectively higher rate, and communicate with the microprocessor system, which operates asynchronously at its slower clock rate. To control gating of the messages to the various counters and registers, phase controls respond to control bits which generate command, DSW, data and other signals denoting the individual fields within the messages. Send state controls 250, receive state controls 260 and R/W state controls 270 receive the clock pulses, identify the fields within the data and control sequencing of data flow during the send, receive and processor clock.
Control of the interface is then effected by three finite state machines (FSMs) one each for the send, receive and processor (R/W) phases. The FSMs are implemented in a conventional manner, using programmable logic arrays (PLAs), a state register and action ROMs. Each FSM is advanced to its next state once per network clock cycle. Because of the number of control signals to be generated, the outputs of the PLAs are further encoded by action ROMs. Those skilled in the art will readily appreciate that translation of the control sequences implied by the operation of the network as described to FSM mode so as to incorporate conventional details and operations is a tedious but straight-forward task.
The state diagrams of FIGS. 17 and 19, and the matrix diagram of FIG. 18, are included to provide comprehensive detail as to internal design features that may be used within a complex system. In FIG. 17, which pertains to the receive phase, and FIG. 19, which pertains to the send phase, the designations used correspond to those employed elsewhere in the specification and drawings. For example, the following terms apply:
RKLC=Receive Key Length Counter
RDLA=Receive Data Length Counter
RNDR=Receive Network Data Word Register
The state diagrams thus are essentially self explanatory, when taken in conjunction with FIG. 13 and the specification. The state diagrams detail the sequences and conditional statements involved in complex message management and inter-processor communication. In FIG. 17, the states labeled "Generate Response" and "Decode Response" and the conditional statements indicated by dashed line rectangles are in accordance with the designated responses and actions set out in the matrix diagram of FIG. 18. FIG. 18 depicts both the responses generated and the actions undertaken for any given combination of primary message and readiness state pertaining to a given TN. Obviously, normal system operation involves some message rejection but very few Error Conditions.
In both FIGS. 17 and 19, many of the conditional determinations can be made concurrently, while the state steps will be changed sequentially. In either event, the Send and Receive operations are regular progressions which do not require external control because of the organization of the messages and manner of operation of the network.
A number of features that are used in typical processor systems, or in multiprocessor systems, are not germane to the invention and are therefore not depicted. These include parity error circuits, interrupt circuits, and various means of monitoring activity, including a watchdog timer and a wide variety of test functions.
The following are provided as examples of how the integrated system of FIGS. 1, 8 and 13 functions in different modes of operation internally while cooperating with the network and the H.S. RAMs. These examples demonstrate how interrelations between the priority scheme, the addressing techniques utilized and the transaction identities provide both local control global intercommunication.
Primary Data Message Reception and Transmission
FIG. 16, to which reference is now made in addition to the other Figures, is a simplified state diagram of the states involved in the ultimate acceptance of a primary message. Reception of the message, at buffers and in storage, does not effectuate acceptance until these logical states have been satisfied. Although depicted at a serial train of events, determinations are essentially made in parallel or concurrently because conditions are mutually exclusive or circuitry bypasses intermediate stages in arriving at a certain operating level.
A message on the network of FIG. 1 is passed through the receive network data register 146 of FIG. 13 until the EOM state is identified, at which point it is known that the message is complete. If a LOCK condition exists, the system references the response directory in the H.S. RAM 26" of FIG. 8, sending the NAK/LOCK reject message.
Alternatively, if the LOCK condition does not exist, the system moves to the map comparison check, carried out within the DSW management section 190 in the interface as shown in FIG. 13. If a proper comparison exists, as indicated by Map Output=1, the system can continue to receive the message. If not, the message is rejected and a NAP is sent.
Having a correct Map determination, the system is then ready to check for TN status by making reference to the directory of the TN's as shown in FIG. 8, specifically to determine whether the local status is "receive ready". It is assumed that the TN was previously assigned by a prior primary message.
If this check reveals that the TN is in the done, nonparticipant or initial states, a NAP reject message is sent. If the status is some other condition that is invalid, the reject message is a NAK/TN error, both types being again taken from the response directory of FIG. 8. If the status is "receive ready" another determination can be made.
This determination is for "input overrun", and is made in the input/output management buffer section 170 of FIG. 13, by comparing the GET and PUT addresses as previously described. The transaction number is also checked for a receive message count of zero, which also indicates input overrun. If the overrun condition does exist, the NAK/input overrun is sent and the message is rejected.
When all conditions are satisfied, an ACK message is derived from the response directory in H.S. RAM 26" and transmitted on the network, in priority competition with other processor modules, some of which may also have acknowledged the message. At this point the message is accepted if the common (i.e. merged) response from the network is an ACK affirming that all selected receiving processor modules can accept the message. If the response is in any other form, the message is rejected by all processors.
In this example of reception and response, it should be noted that after a primary message has been received, all processors generate one of the ACK, NAK, or NAP responses. After receiving one of these response messages, processors may attempt to transmit a primary message. (They may also do so after a delay that is equal to or greater than the total latency delay through the network as discussed above under "Active Logic Node"). Note further that if several processors transmit identical messages, they may all win, in effect, in contention on the network. In this case, all of the transmitting processors receive the ACK response. This fact is of importance in the operation of the broadcast and global semaphore modes, which are described in detail in later examples.
Practical examples of the invention incorporate substantially more responses and perform a number of different actions in addition to those just described. FIG. 18 demonstrates these in the vertical columns entries for Lock, TN error, and Overrun interrupt conditions, the nine different previously identified status levels and the Acknowledgment and Not Applicable Processor responses.
When a processor module is ready to transmit a message, the PTN value stored in the PTN register 206 of FIG. 13 is available, and it need only be ascertained that the TN status is in the "send ready" condition. As seen in FIG. 12, the "send ready" entry contains the next message vector address for the output message. The assembled output message will be transmitted on the network and, if it loses in contention, it is repeated until successful, and a response is received, unless the PTN is changed in the interim. After successful transmission and acknowledgment, the address vectors are changed. The next message vector is obtained from the second word of the present message (FIG. 21A) that is transmitted from the send transaction vector counter 222 to the random access memory 168. The PUT counter 175 is advanced by one if the output message section is not in an overrun condition, which would be indicated by PUT equals GET. Finally, the next message vector from the send transaction vector counter 222 is entered into H.S. RAM at the transaction number address specified by the present transaction number register 206. Thus if the new TN is in the "send ready" state, the vector value again points to the location of the next message pertaining to the transaction identity. Refer to FIG. 21 for the format of an output message in H.S. RAM.
Message management in transmitting messages, however, can involve a number of variants, including an internal or external change in the PTN. Errors, overrun or locked conditions can cause the system to shift the transaction number to TN0, causing the system to revert to the non-merge mode and examine the status at TN0 until the "send ready" state is identified or a new TN is assigned. Refer to the flow chart of FIG. 19 for a delineation of states and conditions that may be used in a detailed example.
Output Message Complete Buffer Example
Upon completion of transmission of a message, as evidenced by any response message except LOCK, a pointer to the newly-completed output buffer is placed in the Output Message Complete Circular Buffer section of H.S. RAM (see FIG. 8). The pointer is simply a 16 bit word which gives the address of the output message buffer. (The format of an output message buffer is shown in FIG. 21. It should be noted that the output message buffer includes a place to record the response message received from the network).
The output message complete circular buffer provides communication between the network interface hardware 120 and supervisory programming on the microprocessor 105. Programs in the microprocessor place messages to be output in H.S. RAM. As described in a subsequent example in detail, output messages can be chained together, with TNs acting as head-of-chain pointers, to form complex sequences of activity. A further factor is that because the network can be multiplexed among TNs (also described in detail below), messages may be output in various orders depending on events throughout the network.
It is important, however, to quickly recover the space in H.S. RAM taken by a successfully transmitted packet so that the space can be reused for another outgoing packet. The output message complete circular buffer serves this function.
When a data message has been successfully sent and a non-Lock response received, the network interface advances the PUT pointer at 0510 (hex) in H.S. RAM (see FIG. 10) by one and stores the address of the first word of the output message just sent at the address in the PUT register. (If the PUT value becomes larger than the TOP pointer at 0512 (hex), it is first reset to be the same as the BOT pointer, which is stored at 0513 (hex)). If the PUT pointer becomes larger than the GET pointer (location 0511 (hex)), the circular buffer has overrun, and an error interrupt is generated to the microprocessor.
Asynchronously, software executing in the microprocessor examines the output message buffer pointed to by the GET pointer. After completing any processing required, the processor advances the GET pointer by 1 (if GET becomes larger than TOP, it is reset to BOT). If, GET=PUT, there are no more output messages to service. Otherwise additional output messages have been successfully sent, and must be processed. Processing includes returning H.S. RAM output buffer space to a free pool, so that it can be reused for other packets.
It is important to note that the output message complete circular buffer is distinct from the input message circular buffer, and the two circular buffers are managed by different PUT, GET, TOP, and BOT pointers. In one implementation, as shown by FIG. 13, circular buffer management hardware 170 can be shared by both circular buffers, although this is not essential.
Each processor module has access to the TNs in its own high speed random access memory 168 (FIG. 13) comprising the directory of potentially available TNs. Those TNs which are unassigned, however, are specifically so designated by the transaction number value in the relevant location. Consequently, the microprocessor system 103 can identify the unassigned transaction numbers and select one for use in initiating communications with other processor modules pertaining to a given transaction identity.
Although TNs are locally assigned and updated under local microprocessor control, global control through the network is achieved by the primary control messages "relinquish TN" and "assign TN". No deadlock condition can arise between competing processor modules that may desire the same TN, because the network will give priority to the lower-numbered processor. Other attemping processors will receive a NACK/TN error response which indicated that they must try to reserve a different TN. There is thus complete flexibility in reserving and referencing these transaction identities within the system and locally.
It will also be noted that repeated use is made of the TN in shifting between the base transmission mode, TN0, and the merge mode, when TN is greater than 0. The system is thus able to change not only the focus of its operations but also the character of its operations by a single broadcast transmission of the TN.
A different and particularly useful technique for transmitting changes of global status is the forced parity error propagation previously discussed in conjunction with FIG. 4. This unique indication, interleaved among other transmissions, enables discontinued system resources to be surveyed and appropriate action to be undertaken.
There are two forms of specific processor communication, one directed to an individual destination and the other directed to a class of processors. Both types of transmissions utilize the DSW, and both functions are carried out by broadcasting in the non-merge mode.
When specifically communicating between an originating processor and a single destination processor, a destination processor identification (DPID) is used in the DSW. Referring to FIG. 8, when this value is used to address the selection map portion of the H.S. RAM 26" at each receiving processor module, only that specific desired processor module provides an affirmative response and accepts the message. Transmission and ultimately successful reception of the acknowledgment enable both processors to take whatever future action is required.
When a class of processors related to a control process are to receive a message, the map nybl and map address within the DSW specify the corresponding section in the selection map portion of the H.S. RAM. All receiving processors then transmit acknowledgments, competing for access to the originating processor module until the communication interchange is finally complete.
The full broadcast mode of processor communication may be used with primary data messages, as well as status, control and response messages. The inherent capabilities of the priority protocol and prioritizing network facilitate the interjection of such messages into other message sequences.
The hashing mode of processor selection is predominantly used in data processing tasks in a relational data base system. Primary and backup disjoint data subsets are distributed in accordance with an appropriate algorithm among the different secondary storages. When two processors respond concurrently, because one is responsible for the primary and the other for the backup, subset, the primary message will be prioritized. A higher priority command code (see FIG. 12) can be chosen to insure this condition. Maintenance of the reliability and integrity of the data base is also achieved by using the various multiprocessor modes to best advantage for each condition that arises. If, for example, the secondary storage having responsibility for a primary data subset fails, it can be updated by a specific processor-to-processor communication. An error can be corrected or a part of the data base can be rolled back in similar fashion or by operating in a class mode.
Transaction Number Example
The transaction number concept provides powerful new hardware facilities for the control of a multiprocessor system. In the present system, the transaction number implements a "global semaphore", plays important roles in sending and receiving messages on the network, and in rapidly ascertaining the readiness of a given task distributed among plural processors.
The physical realization of transaction numbers (TNs) is as a set of 16 bit words in H.S. RAM 26. The words are formatted as shown in FIG. 12 to achieve a variety of functions. Because TNs are stored in H.S. RAM, they can be accessed by both the microprocessor 105 and the network interface 120.
The term "semaphore" has come into common use in computer science literature to denote a variable used for control of asynchronously executing processes. A semaphore has the property that it can be tested and set in one uninterruptible operation.
Consider, for example, a semaphore variable with two states: UNASSIGNED and ASSIGNED. The test-and-set operation is then defined as: "if the semaphore is in the UNASSIGNED state, set it to the ASSIGNED state and indicate success; otherwise if the semaphore is already in the ASSIGNED state, leave it in the ASSIGNED state, but indicate failure." The semaphore thus permits the process which successfully tested and set the semaphore to proceed with its task, where a process which fails must either wait for the semaphore to be reset to the UNASSIGNED state or try to test and set another semaphore controlling another equivalent resource. It will be readily seen that if the test-and-set operation could be interrupted, two processes could simultaneously gain access to the same resource, resulting in unpredictable erroneous results.
Every multiprocessor system implements in hardware a concept which can be equated to semaphores to control access to system resources. Prior art systems, however, can maintain only one copy of the semaphore. It is desirable to maintain plural copies of a semaphore, one in each processor, in order to reduce contention for simple test only access to semaphores, and to use multiple-valued semaphore variables for other purposes, as will be discussed below. The problem is that multiple copies of a semaphore must be manipulated in exact synchronism, or else the access-to-resources integrity which semaphores are intended to enforce will be lost.
A plural-copy, or "global" semaphore is provided by the present system. The following table contrasts the operations on global semaphores with a simple semaphore:
__________________________________________________________________________Operation/Property Simple Semaphore Global Semaphore__________________________________________________________________________states 2 (UNASSIGNED, ASSIGNED) n (UNASSIGNED, ASSIGNED, . . . )number of semaphore 1 m (number of processors)"copies"test returns either ASSIGNED returns highest priority or UNASSIGNED. (numerically lowest) state of all m copies.reset sets semaphore to sets all m copies of the UNASSIGNED, regardless semaphore to UNASSIGNED, of prior state. regardless of prior state.test-and-set if semaphore is UNASSIGNED, if all m copies are UN- set to ASSIGNED and indi- ASSIGNED, set all m copies cate success - else if to ASSIGNED and indicate semaphore is ASSIGNED, success; else if any copy leave it alone indi- is in any state other than cate failure. UNASSIGNED, leave all copies unchanged and indicate failure.__________________________________________________________________________
In the present system, the ASSIGN TN and RELINQUISH TN commands provide the test-and-set and reset functions respectively on transaction numbers used as global semaphores. With reference to FIG. 12, the NAK/TN error response provides the failure indication, where the SACK/ASSIGNED response provides the success indication.
The nature of the network, including the synchronous clocking scheme employed for nodes and the broadcast of the priority packet simultaneously to all processors, is the basis for implementation of the global semaphore concept. With this concept in place, the system can allocate, deallocate, and regulate access to plural copies of any desired system resource simply by associating the resource with a TN. It is important to notice that the control of a distributed resource can be effected with nearly the same modest software overhead of a simple semaphore. This is a considerable advance on prior art systems which either cannot manage distributed resources or require complex software protocols and lead to hardware bottlenecks.
State of Readiness
The set of values BUSY, WAITING, READY (send or receive), DONE, and NON-PARTICIPANT (refer to FIG. 12) provide the capability to rapidly ascertain the state of readiness of a task associated with a TN. In the present system, the following table shows the meaning associated with each state:
______________________________________BUSY The processor is working on the task in question, and results are not ready.WAITING The processor has completed processing, and is waiting for all other processors to complete processing for this task.SEND Data is available in H. S. RAM for outputREADY for this task (TN).RECEIVE Space and other needed resources are availableREADY in this processor to receive data for this task (TN).DONE The processor has no further data to send for this TN.NON-PAR- The processor does not have any processingTICIPANT for this task.INITIAL This TN has never been used since the processor started.______________________________________
A task is associated dynamically with a TN by use of the ASSIGN TN command. Success (a SACK/ASSIGNED response to the ASSIGN TN message) indicates that all active processors have successfully assigned the TN to a task. Note from FIG. 11 that since the NAK/TN ERROR response has higher priority (lower value), if any processor's network interface 120 detects a conflict in the use of the TN, all processors see the failure response. Further, the OPID (originating processor ID) field of the response on the network will indicate the first (lowest numbered) processor with a conflict--a fact of use to diagnostic routines.
By software action, each processor will process the task and will set the TN to BUSY, WAITING, SEND READY, RECEIVE READY, DONE, or NON-PARTICIPANT as appropriate. Any processor, including the processor which issued the original ASSIGN TN, can readily ascertain the state of completion of the task (TN) by issuing either a STATUS REQUEST or START MERGE command at any time.
The STATUS REQUEST corresponds to a simple test of the multiple-valued global semaphore. Notice from FIG. 11 that the highest priority status response (SACK) message will win in contention on the network, thus indicating the least state of readiness. Further, the OPID field will indicate the identity of the first (lowest numbered) processor in the least ready state.
This latter property is used to implement the "non busy" form of waiting for completion of a task distributed to plural processors. The processor which originally issued the ASSIGN TN is considered the original "wait master". That processor then designates some other processor the new "wait master" on any arbitrary basis. When the new "wait master" has itself reached the desired state of readiness, it interrogates all processors by issuing either START MERGE or STATUS REQUEST. If all other processors have become ready, the SACK will so indicate. If some processors are still not ready, the OPID field of the SACK response will indicate the first least ready processor. The "wait master" instructs that processor to become the new "wait master". Eventually, all processors will become ready, but in the meantime, the system only tries to interrogate status when it is known that at least one processor has become ready. The system is thus not burdened by periodic status interrogations, which consume resources without producing results. Further, this scheme guarantees that the system will know that all processors have completed work at the exact moment when the last processor to complete is done. Those skilled in the art will recognize that many other "waiting" schemes are feasible within the context of the invention.
The START MERGE command is a special kind of test-and-set instruction. If the status of the global semaphore is SEND READY or RECEIVE READY, the Present Transaction Number Register (PTNR) 204 (see FIG. 13) is set to the transaction number in the START MERGE message (see FIG. 3), thus setting the PTNR register. If any active processor is in a lesser state of readiness, the PTNR will not be altered.
The STOP MERGE command is the corresponding reset operation, and unconditionally resets the PTNR of all active processors to TN0.
As discussed below, messages pertaining only to the PTNR current global task are output by the network interface 120. The START MERGE and STOP MERGE commands thus provide the ability to time multiplex the network among plural tasks, which can arbitrarily be suspended and/or resumed.
An important detail of the present system is that the network interface 120 must insure that a command from the network and the microprocessor 105 cannot access a TN simultaneously. In the present implementation this is accomplished by a signal from the receive state controls 260 to the read/write state controls 270 which is asserted whenever a command from the network which could alter a TN is being processed. For this brief time, access to the H.S. RAM is denied to the processor by the controls 270. Those skilled in the art will recognize that many alternate implementations are possible within the scope of the invention.
Another function of the TN is control of incoming messages. A given task can be associated with an incoming message stream on plural processors by the ASSIGN TN command. When the TN for that task in a given processor is set to RECEIVE READY, the TN then additionally indicates a count of packets that processor is prepared to accept (FIG. 12). The network interface 120 decrements the count (by arithmetically subtracting 1 from the TN word) for every packet successfully received, until the count reaches zero. At that time, a NACK/OVERRUN response is generated, signaling sending processors that they must wait until the NACKing processor is ready to accept more input. Note also from FIG. 18 that in this case, the PTNR is also reset to TN0.
This mechanism leads to straightforward implementation of control of flow of packets through the network 120. It guarantees that a processor will not become congested with unprocessed packets and thus become a bottleneck to the system.
Referring to FIG. 21, it can be seen that each message in H.S. RAM contains a field for a new TN vector value. After a message is sent and the corresponding response received successfully, the new TN vector from the message just sent is stored in H.S. RAM at the address for the Present Transaction (from the PTNR). The TN is thus updated for every message sent, and thus can automatically be set to any desired state on successful transmission of a message.
Referring to FIG. 12, the SEND READY TN format includes a 14 bit address in H.S. RAM which is used to point to the next packet to be output for the given task (TN). Thus, the TNs in H.S. RAM also serve as head pointers to FIFO queues of messages for various tasks. Within a given task (TN), each processor will thus attempt to output its packets in the serial order defined by the New TN Vector chains.
When combined with the facilities for rapidly multiplexing the network among TNs (tasks) discussed previously, it becomes apparent that complex sets of tasks distributed among many processors can be managed with minimal software overhead. The coaction of the network, interface, and processors provides facilities to allocate, deallocate, suspend, resume, and otherwise control resources and tasks copies of which are distributed among potentially hundreds or even thousands of processors.
The destination selection word (FIG. 3) coacts with DSW logic 190 (FIG. 13) and the DSW section of H.S. RAM 26 (FIG. 8) to provide several modes by which the network interface 120 of each receiving processor can rapidly determine if the message being received is intended for processing by the associated microprocessor 105. As described above, the DSW in the received message both selects and is compared to a nybl in the DSW section of H.S. RAM.
As shown in FIG. 8, a part of the DSW section of H.S. RAM is devoted to processor address selection nybls. In the present system, each of the 1024 possible processors is associated with a bit address in this part of H.S. RAM. The bit is set to 1 at the bit address which corresponds to the processor's ID, all other bits in this section are set to 0. Each processor thus has only one bit set in this section.
Another part of the DSW section of H.S. RAM is devoted to hash maps. In the present system, two of the map selection bits are devoted to hash maps, giving two complete sets of 4096 possible values. In the hashed mode, keys to records stored on secondary storages are put through a hashing algorithm which results in a "bucket" assignment between 0 and 4095. A processor which has responsibility for a given "bucket" of records has a 1 bit set in the map bit whose address corresponds to the bucket number. Other bits are set to 0. A given processor can be assigned responsibility for plural buckets simply by setting plural map bits.
In the present implementation, it is readily appreciated that map bits can be set so that for a given map selection bit, each bit address is set to 1 in only one processor, and further that every bit address is set to a 1 in some processor. As a direct consequence, each processor (AMP) is responsible for a distinct disjoint subset of the records of the data base, and further, across the entire system, a complete set of records exists.
Although the present example is couched in terms of the relational data base problem those skilled in the art will readily appreciate that the same technique can be applied to any problem domain where disjoint subsets of the problem can be assigned to different processors in a multiprocessor complex.
It is further worth noting that with two complete maps, the scheme described above can be arranged so that buckets assigned to a given processor in one map can be assigned to different processor(s) in the other map. If one map is considered as "primary" and the other as "backup", then as a direct consequence, records which are primary on a given processor can be guaranteed to be backed up on other processor(s). Further, the number of processors which provide backup to a given processor is completely flexible.
Those skilled in the art will recognize that the number of distinct map sets which can be realized within the scope of this invention can be greater than two, and further, that the number of buckets can be any value.
In both of the previous examples, examination of a given bit address in every processor shows that that bit address is set to a 1 in only one processor; the corresponding bit address in all other processors is set to 0. However, it is possible and useful for a corresponding bit address to be set to 1 in plural processors. This is referred to as "class address" mode.
The class address is thought of as the name of a process or capability, a copy of which exists in plural processors. Any processor which has the process or capability in question has a 1 bit set in the corresponding bit address.
A message is sent to a class address by setting that class address in the DSW (FIG. 3). All active processors which "belong" to the class, as indicated by a bit set to 1 at the appropriate spot in H.S. RAM will respond to the packet with an ACK. Processors which do not belong to the class respond with NAP.
The DSW thus provides in hardware most of the routing calculations needed to control the flow of messages in a multiprocessor system. Further, programs can be independent of knowledge of in what processors various capabilities of the system reside. Since the maps are part of H.S. RAM, and thus can be accessed by the microprocessor 105, it is further possible to relocate a capability from one processor to another dynamically.
In complex multiprocessor systems, tasks may require a series of interrelated actions to be undertaken. This is particularly true in a relational data base system handling complex queries, in which reference to a number of secondary storages may be needed to assemble data into a file that can then be redistributed in a particular way to a number of processors. The following example briefly delineates how the system of FIGS. 1, 8 and 13 can readily carry out these functions, by manipulating the TNs, DSWs and global semaphores.
First, a merge coordinator, typically but not necessarily an IFP 14 or 16, identifies a class of AMPs (from AMPs 18-23) that are to merge a file, acting as data sources. An unassigned TN is selected and assigned to identify the data source function. The second principal function, of distributing or hashing the file to another set of AMPs (which may be the original processors) is referenced to a different hitherto unassigned TN.
The coordinator for the merge function uses the DSW to identify the class of processor modules that are to perform work in merging of a file related to the first TN. Each participant elevates the status of its TN to a busy or waiting status, and control of the merge operation is then passed over (assigned) to one of the participants in the merge. After reception and acknowledgement of the message packets pertaining to the merge task that has been defined, each participant (all other processor modules are nonparticipants for that transaction number) carries forward with its subtask, updating its status level as appropriate. Consequently, when the assigned merge coordinator reaches the end of its task, it can request status from all other participants as to that transaction number, and receive a response that indicates the least ready of the participants. Control of the merge can be passed to the least ready respondent, which can then poll all of the other participants at such time as its work is completed, and this process can be repeated if necessary until a response has been received that indicates that all participants are ready. The then active coordinator can then, using a DSW to identify the class of participants, initiate the transfer of messages to H.S. RAM 26, accompanied by update of the status levels to "send ready" with appropriate output message vector information. When subsequent polling reveals that all participant AMPs are in a send ready state, the coordinator issues a start merge command for the specified TN.
During merge, the processed data packets are to be directed to the class of processor modules which are then to distribute the results to secondary storage in accordance with the relational data base. Whether or not the receiving processors are the same as the now originating processors, the class of participants in the distribution is identified by a DSW and the transaction is identified by a new TN. All participants in the new transaction will have been assigned that TN and will have elevated their readiness state to "receive ready". The DSW can be a hashing selection designation instead of a class designation, but in any event all of the participants are enabled to receive the broadcast messages during merge. Initiation of the start merge is followed by concurrent transmission of the message packets by each sending participant on the network with dynamic prioritizing taking place. When it completes its set of messages, each sending participant tries to send an identical End of File message of lower priority than the data messages. The End of File messages lose in contention with data messages, until such time as all participants send End of File, when the End of File finally carries through. The coordinator then transmits an End of Merge message, and can follow this with a Relinquish TN which completes the transaction. Overrun, error or lock conditions can be treated appropriately by reinitiating the merge or the transmission.
When a merge has been completed relating to one TN, the system can then shift to the next successive TN in the sequence. Each processor module will have queued the appropriate message packets for that TN and can again commence trying the network to carry the merge operation forward. Separate intra-processor merges accompanied by efficient use of the network merge enables the system to carry out extremely large sort/merge tasks with marked superiority to prior art systems. The time to sort a file in a system in accordance with the invention having n records and m processors can be shown to be: ##EQU1## where C2 is a constant, estimated for the present implementation to be about 10 microseconds for 100 byte message; and C1 is a constant estimated to be about 1 millisecond for a typical 16 bit microprocessor. The approximate sort/merge times, in seconds, for combinations of n and m under different relationships are shown in the following table, based on 100 byte records:
______________________________________FILE SIZEN RECORDSprocessors 1,000 10,000 100,000 1,000,000 10,000,000______________________________________1 10 130 1,700 20,000 230,000 (2 min.) (1/2 hr.) (51/2 hr.) (3 days)10 0.7 10 300 1,700 20,000 (5 min.) (1/2 hr.) (51/2 hr.)100 0.04 0.8 11 140 1,800 (2 min.) (1/2 hr.)1,000 0.011 0.13 1.7 20 230 (4 min.)______________________________________
Comparing these examples to prior art systems is not readily feasible because two interrelated sorting sequences (processor and network) are involved and because few systems even exist that have this capability. Moreover, the system sorts and merges long and variable length messages whereas most sort capabilities are rated in terms of bytes or words.
A significant further factor is that the present system is truly a multiprocessor and not dedicated to sort/merge operations. It can shift with complete flexibility between merge and non-merge operations, both locally and globally, and do so without software penalties or loss of system efficiency.
Task Request/Task Response Cycle Example
Any processor 14, 16 or 18-23 on the network 50, referring to FIG. 1, can formulate a request, in the form of a message packet, for a task to be performed by one or more other processors. In the relational data bse system, most of these tasks will originate with the host computers 10, 12 and be entered into the system via the interface processors 14, 16, but this is not a necessary condition. The message packet that is formulated is put into competition on the network 50 with packets from other processors to gain priority at a time dependent upon the priority level of other tasks and the level of activity on the processor. The task may be defined by a single message packet or continuation packets that are assigned higher priority levels within the data message groupings (see FIG. 11) so as to minimize delay in the reception of the continuation portion.
The message packet contains the transaction identity in the form of the transaction number, which inherently distinguishes, by the choice made, between the nonmerge or default mode (TN0) and the merge mode (all other TNs) as to the manner in which results are to be derived. Further the message packet contains the DSW, which implicitly identifies the target processor and the mode of multiprocessor operation, whether by specific processor identification, plural processor class or hashing, in this instance to a part of the relational data base. A message packet, being broadcast through the network 50 to any target processor is locally accepted at that processor and the reception is acknowledged by a response. All processors 14, 16, and 18-23 provide a concurrent response following the EOM to the network 50, but the ACK from the target processor(s) gains priority and is received by the originating processor.
The target processor or processors then asynchronously perform the processing required by the request packet, at such time as the message is transferred through the local H.S. RAM 26 and interface 120 (FIGS. 8 and 13) into the local microprocessor. For a relational data base task, the DSW typically references a part of the disjoint data subset stored at the associated disk drive although tasks sometimes may be performed that require no reference to the data base. Any specific operation or algorithm may be executed by the individual processor, and if plural processors have been targeted, each can work on a disjoint subset of the overall task. A variable length message packet is structured such that the request can specify the operations to be performed and the files to be referenced in the data base system. It should be noted that there may be numerous message packets in conjunction with a given task, and to provide adequate sorting distinctions within the network 50, the optional key field (FIG. 3) becomes important.
The task response packet that is generated by each processor that is to respond is shifted from the microprocessor into the local H.S. RAM 26 via the control logic 28 of FIG. 1 where it is stored in the send message format of FIG. 21A. Where the task response requires continuation packets to be employed, there are transmitted after the lead packet but given the higher continuation priority. Where the system is operating in the merge mode and each processor generates a number of packets pertaining to a transaction number, the packets may first be locally chained together in a sort order for subsequent merge into a global sort order on the network 50.
The task result packet or packets are sent from the processors 14, 16 and 18-23 to the network 50 in concurrent groupings, with a single priority messge packet being broadcast back to all processors after the predetermined network delay. The transfer of these task result packets may, dependent upon the nature of the task, be targeted for the original request or to one or more other processors, and may be transferred in accordance with any one of the multiprocessor modes. The most general case in the relational data base system is a concurrent merge and redistribution using hashing for destination selection. Thus it is seen that each processor can act as an originator, coordinator or responder, or all three, in a task request/task response cycle, Because multiple task request/task response cycles are involved, the processors 14, 16 and 18-23 and the network 50 are multiplexed among the tasks, but the multiplexing is done on a priority as well as a time basis.
Complex Query Example
In the relational data base system, using the host computers 10, 12 and a distribution of the relational data base among the disk drives 38-43 in accordance with an algorithm defining the tuples and the primary and backup disjoint data subsets, complex queries are entered into the system from the host computer 10 or 12 at the IFP 14 or 16. The message packet is first parsed by the IFP 14 or 16, in order to transform the message from the host into task requests for the AMPS 18-23. At the outset, the IFP 14 or 16 may be required to initiate request packets to derive information from one or more specific AMPs to obtain the system data that is needed to parse the message from the host. Having the data needed for processing the request, the IFP 14 or 16 may then require any number of task request/test response cycles with the AMPs 18-23, and actually process the data and satisfy the request from the host. In the sequences, the task request and task response cycle enumerated above are utilized, and may be of arbitrary length. The IFP 14 or 16 then communicates with the host via the IFP interface. This response may simply provide the data needed for the host computer 10 or 12 to generate another complex query.
The primary example of a system in accordance with the invention, discussed above in conjunction with FIG. 1, exemplifies a backend processor that may be utilized in conjunction with a host computer and its existing software package. As noted above, however, the present invention is of particular advantage for a wide range of processing applications, particularly those of the type in which processing tasks may be readily subdivided and distributed without requiring massive central processing power. FIG. 20 illustrates one simplified example of a stand alone multiprocessor system in accordance with the invention. In FIG. 20, all of a number of processors 300 are coupled by interfaces 302 to an active logic network 304, such as previously described. It is understood that redundant active logic networks 304 may be utilized for data integrity. The processors 300 may again use 16 bit microprocessor chips, and incorporate adequately large main RAM memory. Only nine processors 300 are shown, each associated with a different peripheral, in order to depict the versatility of the system. In actuality the system becomes far more efficient with many more processors on the network, although particular advantages can be gained in system reliability and data integrity even with relatively few processors.
In the present example, the processors 300 may be physically separated by convenient distances, inasmuch as the maximum internode spacing of 28 feet for the stated data rates allows a large array of processors to be utilized on one building floor or on several adjacent floors without undue crowding.
In the stand alone system the peripheral controllers and peripherals themselves can vary much more widely than in the backend processor example discussed above. It is convenient to assume that each input and output device is associated with a separate processor 300. For example, an I/O terminal 310 including a keyboard 312 and display 314 is coupled to its respective processor 300 by a terminal controller 320, even though a 16 bit processor might control a substantial network of relatively slow terminals. The I/O terminal shown merely illustrates how manual keyboard and other manual entry and processing devices may be tied into the system. Using the processing power of the processor 300, the terminal 310 can comprise a word processor, and it can communicate via the network 304 with a data base, other word processors, or various output devices. Large secondary memories, such as a rigid disk drive 322 may be coupled to their respective processor by disk controllers 324, it being understood that more disk drives or a different form of mass memory could be used in a large system. Output devices, such as a printer 326 and a plotter 330 interface with their processors 300 via a printer controller 328 and plotter controller 332, respectively. Interaction with other systems, not shown, is via a communications system 336, such as a TTY or one of the larger networks (e.g. Ethernet), through a communications controller 338. Some processors 300 may be coupled to the network 304 without a peripheral device (not shown).
Bidirectional data transfers may take place using a tape drive 340 and tape drive controller 342, and a floppy disk drive 344 with its associated controller 346. Tape drives not only provide large storage capacity for on-line use, but can also be employed for disk drive backup. For this purpose tape is used to retain data that was stored, as of a fixed point in time in a sealed rigid disk system. Because these backup operations are usually performed during low load periods (e.g. nights or weekends) long "streaming" transfers can take place through the network 304. Similarly, because floppy disk drives 344 may be used for program entry during system initialization, some network time is available in these modes for transfers of substantial amounts of data. An optical character reader 350 provides another source of input data for the system through its controller 352. Finally, peripheral units, labeled simply "other devices 354" can be coupled to the system via a controller 356 to provide further capabilities as needed.
Using the technique of concurrently transmitting message packets from the various processor modules, and prioritizing these message packets into a single or common message packet that is concurrently broadcast within a predetermined fixed time interval back to all processor modules, each processor that is on line can have equal access to other modules in the system. Because the global semaphore system using prioritized transaction numbers and readiness indications, as well as destination selection entries in the messages, permits any processor to act as controller, the system can function in either a heirarchical or non-hierarchical manner. It is highly significant that the system can be expanded, or contracted, without requiring software elaboration or modification.
Where access for messages substantially longer than those previously described but still relatively limited in length is required, this can still be accomplished. For example complex computer graphics systems (not shown) may require access only to particular parts of an extensive data base to generate sophisticated two dimensional and three dimensional representations. A word processing system may need, from the data base, only small sequences of data at any one time because of the slowness of the human operator. In these and other situations the capability of the system for handling variable length messages and giving priority to continuation messages can be of benefit. While situations that call for concentrated processing power and extremely long message transfers impose limits on use of the system, there are other circumstances in which it functions to much greater advantage. Any dynamic situation involving the manipulation of different data forms and inherent sorting or merging functions falls in this category. Management decision making involving the gathering, collation and analysis of complex data is one such example, while the preparation and assembly of the visual and graphical input for a periodical is another.
It will be immediately evident to those skilled in the art that the system of FIG. 1 is expandable to incorporate any number of processors (up to a practical limit imposed by data transfer capacity) without any need for software modification. It will also be appreciated that the system circumvents in large measure the need for supervisory and overhead software to ascertain the status of units, to establish task and processor priorities and to assure efficient usage of processor capability.
Clear benefits are derived for data base systems and for other systems in which it is similarly feasible to subdivide the overall task into subtasks that can be processed independently. In the relational data base context for example a dramatic increase in secondary storage capacity requires only that the additional data base be properly integrated into the primary and backup structure. Stated in another way, the network can be indefinitely expanded because being based upon a binary progression with standardized intersections or nodes there is no change with expansion in the functions performed at each individual node. Further, no setup sequence or external control of node operation is required. Consequently if a system in accordance with the invention is coupled as shown in FIG. 1 to serve as back-end processor for one or more host computers, the system user can arbitrarily expand (or contract) the data base without changing either operating system software or applications software. From the standpoint of the host processor system the back-end processor is transparent, whatever its configuration, because its interaction with the host processor remains the same. Conversion of the back-end processor to service a different host processor system requires only that the IFPs converse properly with the new host processor channel or bus.
The network configuration in one exemplification enables up to 1024 microprocessors to be used in a single array without excessive delay in transferring messages through the network or encountering undue delays due to interprocessor competition. Those skilled in the art will readily see how to extend the example described to more than 1024 processors. For a system using 1024 processors, the maximum line length between active nodes in a practical example is found to be 28 feet, which presents no problems in configuring an array. The delay introduced by the network is constant for all messages, and is 2τN, where τ is the byte clock period and N is the number of tiers in the hierarchy. As is evident, doubling of the number of processors by adding another tier imposes only a minimal increase in the delay. Because data messages will necessarily be long (of the order of 200 bytes) and because the prioritizing is done during data transfer along the network with respect to all competing messages, the network can carry data messages with much higher utilization percentages than prior art systems.
Important economic and operative aspects of the system also derive from the fact that standardized active logic circuits are used instead of software or even firmware in the network system. Using modern LSI and VLSI techniques, reliable circuitry can be incorporated at low cost in relation to overall processor and peripheral equipment costs. Expenditures of time and money for software are limited to the important aspects that pertain to data base management or other problem-domain tasks. For example, the system organization is such that all of the functions needed to maintain the integrity of a data base can be carried out within the message packets and network configurations. Such functions as polling, change of status and recovery of data are provided for within the system.
An important further consideration is that this network compares very favorably to the conventional ohmic wire bus in its capability for rapid data transfer. Message packets are transmitted concurrently for a time, and transferred while priority is being determined, so that delays for conventional status requests, responses and priority determinations are avoided. Moreover, the inter-nodal couplings can be kept to less than a predetermined length, even for an extremely large number of processors, so that propagation time through the bus is not a limitation on data transfer rate.
It has been established that the system approaches the optimum in terms of efficiency of usage of the microprocessors and the network as well. What is important is that all microprocessors be kept busy and that the network be utilized to full advantage. The IFP-network-AMP configuration effectively makes this possible because microprocessors whose transmitted message packets lose in contention for priority simply retry at the earliest feasible time, thus helping to assure a high bus duty cycle. The high speed random access memories contribute further to this result, because they accumulate both input message packets to be processed and output messages to be transmitted, and thus a backlog of work is constantly available for each microprocessor and a backlog of message packets are also available for the network. When all input buffers are filled, a processor indicates that fact on the network. Further, when the input buffers used in an IFP to receive messages from a host computer are full, an indication to that effect is placed on the channel. Both internally and externally, therefore, the system is self pacing.
The system is realized in such a way, employing both the architecture and the message organization, as to carry out numerous other functions necessary to a versatile multiprocessor system. The prior art, for example, devotes considerable attention to schemes for assessing and monitoring changes in the status of the global resource. In accordance with the present invention, however, the parity channel alone is arranged and utilized as the means for communicating both the existence of parity errors and the fact of a change in processor availability. Shut down of one or more processors is substantially immediately communicated throughout the system such that an interrupt sequence can be initiated. Using the prioritized sort of responses, the nature of the change in global capability can be identified with far less circuity and system overhead than previously.
The single query, prioritized global response that is achieved by the use of global semaphores and the active logic network has profound systems implications. Obtaining an unambiguous global result by a broadcast query in this fashion bypasses any need for complex software and overhead. Distributed update and other status identifying operations can be realized even though numerous simultaneous operations are taking place at different processors.
The system also provides, by using the network, transaction numbers, global semaphores, and destination selection words, superior capabilities for distributing work and collecting results in a multiprocessor system. A number of multiprocessor modes and control messages are available and priority levels are easily defined and changed using only the priority protocol. The capability of simultaneously broadcasting to all processors, in conjunction with message sorting in the network, insures that any processor grouping or individual processor can be reached and that processed results can be derived in orderly fashion. Complex queries to a relational data base system can thus initiate any sequence needed for a data base operation.
Another advantage of the system lies in the redundancy which can readily be built into a multiprocessor, such as a relational data base system. Dual networks and dual interfaces provide redundancy which permits the system to continue to operate if one network fails for any reason. The distribution of the data base into disjoint primary and backup subsets reduces the probability of data loss to a minimal level. Where a failure or change does occur, the integrity of the data base can be maintained because of the versatile controls that can be used.
|Brevet cité||Date de dépôt||Date de publication||Déposant||Titre|
|US3753234 *||25 févr. 1972||14 août 1973||Reliance Electric Co||Multicomputer system with simultaneous data interchange between computers|
|US4229790 *||16 oct. 1978||21 oct. 1980||Denelcor, Inc.||Concurrent task and instruction processor and method|
|US4344134 *||30 juin 1980||10 août 1982||Burroughs Corporation||Partitionable parallel processor|
|Brevet citant||Date de dépôt||Date de publication||Déposant||Titre|
|US4445171 *||1 avr. 1981||24 avr. 1984||Teradata Corporation||Data processing systems and methods|
|US4459664 *||23 févr. 1982||10 juil. 1984||U.S. Philips Corporation||Multiprocessor computer system with dynamic allocation of multiprocessing tasks and processor for use in such multiprocessor computer system|
|US4466060 *||11 févr. 1982||14 août 1984||At&T Bell Telephone Laboratories, Incorporated||Message routing in a computer network|
|US4498133 *||10 déc. 1981||5 févr. 1985||Burroughs Corp.||Selector switch for a concurrent network of processors|
|US4498134 *||26 janv. 1982||5 févr. 1985||Hughes Aircraft Company||Segregator functional plane for use in a modular array processor|
|US4543627 *||14 déc. 1981||24 sept. 1985||At&T Bell Laboratories||Internal communication arrangement for a multiprocessor system|
|US4543630 *||19 avr. 1984||24 sept. 1985||Teradata Corporation||Data processing systems and methods|
|US4543642 *||26 janv. 1982||24 sept. 1985||Hughes Aircraft Company||Data Exchange Subsystem for use in a modular array processor|
|US4591981 *||26 avr. 1983||27 mai 1986||V M E I "Lenin" Quartal Darvenitza||Multimicroprocessor system|
|US4603235 *||21 mai 1984||29 juil. 1986||Gte Communication Systems Corporation||Dynamic event selection network|
|US4615001 *||29 mars 1984||30 sept. 1986||At&T Bell Laboratories||Queuing arrangement for initiating execution of multistage transactions|
|US4635189 *||1 mars 1984||6 janv. 1987||Measurex Corporation||Real-time distributed data-base management system|
|US4644547 *||28 juin 1984||17 févr. 1987||Westinghouse Electric Corp.||Digital message format for two-way communication and control network|
|US4646229 *||15 nov. 1982||24 févr. 1987||At&T Bell Laboratories||Time-ordered data base|
|US4706080 *||26 août 1985||10 nov. 1987||Bell Communications Research, Inc.||Interconnection of broadcast networks|
|US4725946 *||27 juin 1985||16 févr. 1988||Honeywell Information Systems Inc.||P and V instructions for semaphore architecture in a multiprogramming/multiprocessing environment|
|US4745546 *||25 juin 1982||17 mai 1988||Hughes Aircraft Company||Column shorted and full array shorted functional plane for use in a modular array processor and method for using same|
|US4779192 *||21 déc. 1984||18 oct. 1988||Hitachi, Ltd.||Vector processor with a synchronously controlled operand fetch circuits|
|US4787033 *||22 sept. 1983||22 nov. 1988||Digital Equipment Corporation||Arbitration mechanism for assigning control of a communications path in a digital computer system|
|US4809164 *||26 mars 1986||28 févr. 1989||Tandem Computers Incorporated||Processor controlled modifying of tabled input/output priority|
|US4814980 *||1 avr. 1986||21 mars 1989||California Institute Of Technology||Concurrent hypercube system with improved message passing|
|US4843540 *||2 sept. 1986||27 juin 1989||The Trustees Of Columbia University In The City Of New York||Parallel processing method|
|US4845744 *||16 oct. 1986||4 juil. 1989||American Telephone And Telegraph Company, At&T Bell Laboratories||Method of overlaying virtual tree networks onto a message passing parallel processing network|
|US4853875 *||19 janv. 1988||1 août 1989||Eastman Kodak Company||Image-capable interprocessor link communications protocol|
|US4893231 *||11 sept. 1987||9 janv. 1990||International Computers Limited||Multi-node data processing system|
|US4901231 *||22 déc. 1986||13 févr. 1990||American Telephone And Telegraph Company||Extended process for a multiprocessor system|
|US4922408 *||12 mai 1988||1 mai 1990||Schlumberger Technology Corporation||Apparatus for multi-processor communications|
|US4925311 *||10 févr. 1986||15 mai 1990||Teradata Corporation||Dynamically partitionable parallel processors|
|US4928222 *||31 oct. 1988||22 mai 1990||International Business Machines Corporation||Enhanced semaphore architecture|
|US4937737 *||31 août 1988||26 juin 1990||International Business Machines Corporation||Process transparent multi storage mode data transfer and buffer control|
|US4945470 *||20 juin 1985||31 juil. 1990||Hitachi. Ltd.||Hierarchy multi-processor system and control method therefor|
|US4965719 *||16 févr. 1988||23 oct. 1990||International Business Machines Corporation||Method for lock management, page coherency, and asynchronous writing of changed pages to shared external store in a distributed computing system|
|US5001642 *||20 févr. 1986||19 mars 1991||Robert Bosch Gmbh||Method for operating a data processing system|
|US5008819 *||19 juil. 1989||16 avr. 1991||Gorbatenko George G||Memory spaced array|
|US5019962 *||15 janv. 1988||28 mai 1991||Hitachi, Ltd.||Direct memory access controller for a multi-microcomputer system|
|US5020081 *||19 sept. 1989||28 mai 1991||Data General Corporation||Communication link interface with different clock rate tolerance|
|US5023772 *||31 oct. 1988||11 juin 1991||International Business Machines Corporation||Method and system for storing messages based upon a non-queried name assignment|
|US5050072 *||17 juin 1988||17 sept. 1991||Modular Computer Systems, Inc.||Semaphore memory to reduce common bus contention to global memory with localized semaphores in a multiprocessor system|
|US5051892 *||9 févr. 1989||24 sept. 1991||International Business Machines Corp.||Full duplex conversation between transaction programs|
|US5058002 *||13 juin 1988||15 oct. 1991||Mitsubishi Denki Kabushiki Kaisha||Page splitting method and apparatus for a database stored in a plurality of memory storage units|
|US5067104 *||1 mai 1987||19 nov. 1991||At&T Bell Laboratories||Programmable protocol engine having context free and context dependent processes|
|US5125096 *||31 oct. 1988||23 juin 1992||International Business Machines Corporation||System for implementing to a packet switch protocol for a multinode data communications network utilizing separate data and control paths|
|US5130992 *||16 avr. 1990||14 juil. 1992||International Business Machines Corporaiton||File-based redundant parity protection in a parallel computing system|
|US5133053 *||13 févr. 1987||21 juil. 1992||International Business Machines Corporation||Interprocess communication queue location transparency|
|US5146605 *||23 janv. 1991||8 sept. 1992||International Business Machines Corporation||Direct control facility for multiprocessor network|
|US5159673 *||11 mars 1992||27 oct. 1992||Square D Company||Apparatus for networking programmable logic controllers to host computers|
|US5163156 *||16 mars 1990||10 nov. 1992||At&T Bell Laboratories||Method for distributing messages through a mapping table which includes for each originating device a sequential list of corresponding destination devices|
|US5165031 *||16 mai 1990||17 nov. 1992||International Business Machines Corporation||Coordinated handling of error codes and information describing errors in a commit procedure|
|US5191652 *||10 nov. 1989||2 mars 1993||International Business Machines Corporation||Method and apparatus for exploiting communications bandwidth as for providing shared memory|
|US5201044 *||16 avr. 1990||6 avr. 1993||International Business Machines Corporation||Data processing method for file status recovery includes providing a log file of atomic transactions that may span both volatile and non volatile memory|
|US5230047 *||16 avr. 1990||20 juil. 1993||International Business Machines Corporation||Method for balancing of distributed tree file structures in parallel computing systems to enable recovery after a failure|
|US5245607 *||5 mars 1990||14 sept. 1993||At&T Bell Laboratories||Data network message broadcast arrangement|
|US5245609 *||30 janv. 1991||14 sept. 1993||International Business Machines Corporation||Communication network and a method of regulating the transmission of data packets in a communication network|
|US5253343 *||15 juil. 1992||12 oct. 1993||La Telemecanique Electric||Method for the management of a memory of messages in a station of a data transmission network, and station designed for the implementation of the method|
|US5261089 *||16 mai 1990||9 nov. 1993||International Business Machines Corporation||Optimization of commit procedures by utilizing a two-phase commit procedure only when necessary|
|US5276876 *||16 mai 1990||4 janv. 1994||International Business Machines Corporation||Registration of resources for commit procedures|
|US5303348 *||23 mars 1992||12 avr. 1994||Robert Bosch Gmbh||Method of arbitrating access to a data bus and apparatus therefor|
|US5303383 *||14 août 1992||12 avr. 1994||Ncr Corporation||Multiprocessor computer system|
|US5319773 *||16 mai 1990||7 juin 1994||International Business Machines Corporation||Asynchronous resynchronization of a commit procedure|
|US5319774 *||16 mai 1990||7 juin 1994||International Business Machines Corporation||Recovery facility for incomplete sync points for distributed application|
|US5327532 *||16 mai 1990||5 juil. 1994||International Business Machines Corporation||Coordinated sync point management of protected resources|
|US5335347 *||23 janv. 1991||2 août 1994||Sun Microsystems, Inc.||Method and apparatus for scoped interprocess message switching|
|US5339418 *||16 déc. 1993||16 août 1994||Digital Equipment Corporation||Message passing method|
|US5353412 *||16 août 1991||4 oct. 1994||Thinking Machines Corporation||Partition control circuit for separately controlling message sending of nodes of tree-shaped routing network to divide the network into a number of partitions|
|US5363121 *||29 juin 1990||8 nov. 1994||International Business Machines Corporation||Multiple protocol communication interface for distributed transaction processing|
|US5363505 *||9 juin 1993||8 nov. 1994||International Business Machines Corporation||Local and global commit scopes tailored to work units|
|US5367681 *||2 nov. 1993||22 nov. 1994||Sun Microsystems, Inc.||Method and apparatus for routing messages to processes in a computer system|
|US5375219 *||5 avr. 1993||20 déc. 1994||Fujitsu Limited||Common system with a plurality of processors using a common memory and utilizing an interrupt signal|
|US5379426 *||23 mai 1994||3 janv. 1995||Sun Microsystems, Inc.||Method and apparatus for object oriented interprocess message switching|
|US5394551 *||30 sept. 1992||28 févr. 1995||International Computers Limited||Semaphore mechanism for a data processing system|
|US5404534 *||1 juin 1994||4 avr. 1995||Sun Microsystems, Inc.||Method and apparatus for extensible object-oriented inter-application link management|
|US5404562 *||1 oct. 1993||4 avr. 1995||Thinking Machines Corporation||Massively parallel processor including queue-based message delivery system|
|US5410684 *||20 sept. 1993||25 avr. 1995||International Business Machines Corporation||Log name exchange for recovery of protected resources|
|US5434972 *||10 janv. 1992||18 juil. 1995||Gec-Marconi Limited||Network for determining route through nodes by directing searching path signal arriving at one port of node to another port receiving free path signal|
|US5469575 *||16 oct. 1992||21 nov. 1995||International Business Machines Corporation||Determining a winner of a race in a data processing system|
|US5508815 *||13 sept. 1995||16 avr. 1996||Smart Vcr Limited Partnership||Schedule display system for video recorder programming|
|US5522046 *||3 juin 1994||28 mai 1996||Ncr Corporation||Communication system uses diagnostic processors and master processor module to identify faults and generate mapping tables to reconfigure communication paths in a multistage interconnect network|
|US5526487 *||9 févr. 1989||11 juin 1996||Cray Research, Inc.||System for multiprocessor communication|
|US5553240 *||26 juin 1995||3 sept. 1996||International Business Machines Corporation||Determining a winner of a race in a data processing system|
|US5568272 *||20 oct. 1995||22 oct. 1996||Smart Vcr Limited Partnership||Schedule display system for video recorder programming|
|US5594927 *||15 sept. 1994||14 janv. 1997||Digital Equipment Corporation||Apparatus and method for aligning data transferred via DMA using a barrel shifter and a buffer comprising of byte-wide, individually addressabe FIFO circuits|
|US5621888 *||5 juin 1995||15 avr. 1997||Robert Bosch Gmbh||Method of building up messages for driving a data processing arrangement with several stations receiving connected thereto|
|US5632042 *||26 juil. 1993||20 mai 1997||Japan Radio Co. Ltd.||Data flow processor and data flow process changing system|
|US5640511 *||24 janv. 1994||17 juin 1997||Robert Bosch Gmbh||Method of arbitrating access to a data bus and apparatus therefor|
|US5649106 *||2 mai 1996||15 juil. 1997||Mitsubishi Denki Kabushiki Kaisha||Parallel computer with reconstruction of processor clusters|
|US5649185 *||5 avr. 1995||15 juil. 1997||International Business Machines Corporation||Method and means for providing access to a library of digitized documents and images|
|US5680550 *||13 févr. 1995||21 oct. 1997||Tm Patents, Lp||Digital computer for determining a combined tag value from tag values selectively incremented and decremented reflecting the number of messages transmitted and not received|
|US5745698 *||28 août 1996||28 avr. 1998||International Business Machines Corporation||System and method for communicating between devices|
|US5796605 *||2 juil. 1996||18 août 1998||Sun Microsystems, Inc.||Extended symmetrical multiprocessor address mapping|
|US5802289 *||24 sept. 1996||1 sept. 1998||Apple Computer, Inc.||Method for propagating preemptive bus initialization on an acyclic directed graph|
|US5805839 *||2 juil. 1996||8 sept. 1998||Advanced Micro Devices, Inc.||Efficient technique for implementing broadcasts on a system of hierarchical buses|
|US5832261 *||30 nov. 1992||3 nov. 1998||Fujitsu Limited||Barrier synchronizing mechanism for a parallel data processing control system|
|US5835755 *||4 avr. 1994||10 nov. 1998||At&T Global Information Solutions Company||Multi-processor computer system for operating parallel client/server database processes|
|US5867723 *||5 août 1996||2 févr. 1999||Sarnoff Corporation||Advanced massively parallel computer with a secondary storage device coupled through a secondary storage interface|
|US5872904 *||24 mai 1996||16 févr. 1999||Ncr Corporation||Computer system using a master processor to automatically reconfigure faulty switch node that is detected and reported by diagnostic processor without causing communications interruption|
|US5901156 *||5 juin 1995||4 mai 1999||Robert Bosch Gmbh||Method of processing messages to be transmitted for a data processing arrangement|
|US5915068 *||18 oct. 1996||22 juin 1999||Smart Vcr Limited Partnership||VCR programmer|
|US5920691 *||16 juil. 1996||6 juil. 1999||Kabushiki Kaisha Toshiba||Computer network system for collecting distributed management information|
|US5970471 *||22 mars 1996||19 oct. 1999||Charles E. Hill & Associates, Inc.||Virtual catalog and product presentation method and apparatus|
|US5978791 *||24 oct. 1997||2 nov. 1999||Kinetech, Inc.||Data processing system using substantially unique identifiers to identify data items, whereby identical data items have the same identifiers|
|US6029142 *||1 juin 1998||22 févr. 2000||Charles E. Hill & Associates, Inc.||Electronic catalog system and method|
|US6101321 *||22 sept. 1994||8 août 2000||Eastman Kodak Company||Method and apparatus for broadcasting data in a ring connected multiprocessor|
|US6131088 *||18 mai 1998||10 oct. 2000||Charles E. Hill & Associates, Inc.||Electronic catalog system and method|
|US6202174 *||16 sept. 1996||13 mars 2001||Advanced Micro Devices Inc||Method for identifying and correcting errors in a central processing unit|
|US6229912 *||3 oct. 1997||8 mai 2001||Hitachi, Ltd.||Particle image analyzing apparatus|
|US6243361||10 nov. 1998||5 juin 2001||Ncr Corporation||Multistage interconnect network uses a master processor to perform dynamic configuration for all switch nodes based on a predetermined topology|
|US6275843 *||22 sept. 1997||14 août 2001||Unisys Corporation||Method and apparatus for processing multiple service requests within a global transaction by a single server application program instance|
|US6330640 *||26 oct. 2000||11 déc. 2001||Seagate Technology Llc||Buffer management system for managing the transfer of data into and out of a buffer in a disc drive|
|US6412002||15 nov. 1999||25 juin 2002||Ncr Corporation||Method and apparatus for selecting nodes in configuring massively parallel systems|
|US6418526||15 nov. 1999||9 juil. 2002||Ncr Corporation||Method and apparatus for synchronizing nodes in massively parallel systems|
|US6484274||29 oct. 1999||19 nov. 2002||Advanced Micro Devices, Inc.||Method for identifying and correcting error in a central processing unit|
|US6487619 *||14 oct. 1999||26 nov. 2002||Nec Corporation||Multiprocessor system that communicates through an internal bus using a network protocol|
|US6496885 *||14 juil. 1999||17 déc. 2002||Deere & Company||Method for processing network messages|
|US6519697||15 nov. 1999||11 févr. 2003||Ncr Corporation||Method and apparatus for coordinating the configuration of massively parallel systems|
|US6529996||30 juin 1999||4 mars 2003||Storage Technology Corporation||Network attached virtual tape data storage subsystem|
|US6578039||31 oct. 2000||10 juin 2003||Hitachi, Ltd.||Database management methods and equipment, and database management program storage media|
|US6631476 *||21 sept. 2000||7 oct. 2003||Rockwell Automation Technologies, Inc.||Safety network for industrial controller providing redundant connections on single media|
|US6658526||20 oct. 1999||2 déc. 2003||Storage Technology Corporation||Network attached virtual data storage subsystem|
|US6745240||15 nov. 1999||1 juin 2004||Ncr Corporation||Method and apparatus for configuring massively parallel systems|
|US6757781||7 déc. 2001||29 juin 2004||Seagate Technology Llc||Buffer management system for managing the transfer of data into and out of a buffer in a disc drive|
|US6826615||12 juin 2001||30 nov. 2004||Bluearc Uk Limited||Apparatus and method for hardware implementation or acceleration of operating system functions|
|US6834324||10 avr. 2000||21 déc. 2004||Storage Technology Corporation||System and method for virtual tape volumes|
|US6862151||28 juin 2001||1 mars 2005||Seagate Technologies Llc||Method and apparatus for read error recovery|
|US6870464 *||21 déc. 2000||22 mars 2005||Leading Information Technology Institute, Inc.||Inventory control system|
|US6925525||26 sept. 2002||2 août 2005||Storage Technology Corporation||Data storage management system and method|
|US6928442||15 nov. 2001||9 août 2005||Kinetech, Inc.||Enforcement and policing of licensed content using content-based identifiers|
|US6941360 *||25 févr. 1999||6 sept. 2005||Oracle International Corporation||Determining and registering participants in a distributed transaction in response to commencing participation in said distributed transaction|
|US6999994 *||29 juin 2000||14 févr. 2006||International Business Machines Corporation||Hardware device for processing the tasks of an algorithm in parallel|
|US7013395 *||13 mars 2001||14 mars 2006||Sandra Corporation||Method and tool for network vulnerability analysis|
|US7058084||14 févr. 2001||6 juin 2006||Ncr Corporation||Multistage interconnect network combines back channel replies received from destinations into a single result and transmits to the source|
|US7114013||28 sept. 2001||26 sept. 2006||Storage Technology Corporation||Intelligent data storage manager|
|US7171529 *||19 mars 2003||30 janv. 2007||Nec Electronics Corporation||Single-chip microcomputer with read clock generating circuits disposed in close proximity to memory macros|
|US7203682||1 nov. 2002||10 avr. 2007||Verisign, Inc.||High speed non-concurrency controlled database|
|US7284022||3 avr. 2003||16 oct. 2007||Hitachi, Ltd.||Database management methods and equipment and database management program storage media|
|US7359340 *||2 févr. 2001||15 avr. 2008||René Duranton||Method and device for automatically attributing addresses to a plurality of modules interconnected by a communication network with complex topology|
|US7383311||3 janv. 2006||3 juin 2008||International Business Machines Corporation||Hardware device for processing the tasks of an algorithm in parallel|
|US7457822||1 nov. 2002||25 nov. 2008||Bluearc Uk Limited||Apparatus and method for hardware-based file system|
|US7519624 *||16 nov. 2005||14 avr. 2009||International Business Machines Corporation||Method for proactive impact analysis of policy-based storage systems|
|US7558802||31 janv. 2006||7 juil. 2009||Hitachi, Ltd||Information retrieving system|
|US7571168 *||25 juil. 2006||4 août 2009||Parascale, Inc.||Asynchronous file replication and migration in a storage network|
|US7574443||25 juil. 2006||11 août 2009||Parascale, Inc.||Scalable clustered storage system|
|US7596595||18 juin 2003||29 sept. 2009||Utah State University||Efficient unicast-based multicast tree construction and maintenance for multimedia transmission|
|US7599941||25 juil. 2006||6 oct. 2009||Parascale, Inc.||Transparent redirection and load-balancing in a storage network|
|US7647296 *||15 mars 2006||12 janv. 2010||International Business Machines Corporation||Method for estimating a first access time of transactions accessing a database object|
|US7706361||20 sept. 2005||27 avr. 2010||Teradata Us, Inc.||Reconfigurable, fault tolerant, multistage interconnect network and protocol|
|US7711909 *||9 déc. 2004||4 mai 2010||Oracle America, Inc.||Read sharing using global conflict indication and semi-transparent reading in a transactional memory space|
|US7716250 *||27 mai 2005||11 mai 2010||Microsoft Corporation||Erasure coding and group computations using rooted binary and ternary trees|
|US7783762||22 sept. 2006||24 août 2010||International Business Machines Corporation||Scalable resource discovery and reconfiguration for distributed computer networks|
|US7797375||7 mai 2001||14 sept. 2010||International Business Machines Corporat||System and method for responding to resource requests in distributed computer networks|
|US7801846 *||4 avr. 2006||21 sept. 2010||Computer Associates Think, Inc.||Generating log sequence identifiers to apply a transaction to a storage system|
|US7802310||31 oct. 2007||21 sept. 2010||Kinetech, Inc.||Controlling access to data in a data processing system|
|US7818313 *||14 juil. 2006||19 oct. 2010||Sybase, Inc.||Method for distributing processing of queries over a cluster of servers in a continuous processing system|
|US7836033 *||24 janv. 2006||16 nov. 2010||Network Appliance, Inc.||Method and apparatus for parallel updates to global state in a multi-processor system|
|US7873781||24 juin 2008||18 janv. 2011||Storage Technology Corporation||Data storage management method for selectively controlling reutilization of space in a virtual tape system|
|US7908173||14 sept. 2005||15 mars 2011||Charles E. Hill & Associates, Inc.||Virtual catalog and product presentation method and apparatus|
|US7908176||9 juil. 2008||15 mars 2011||Charles E. Hill & Associates, Inc.||Virtual catalog and product presentation method and apparatus|
|US7945539||31 oct. 2007||17 mai 2011||Kinetech, Inc.||Distributing and accessing data in a data processing system|
|US7945544||31 oct. 2007||17 mai 2011||Kinetech, Inc.||Similarity-based access control of data in a data processing system|
|US7949662||23 déc. 2003||24 mai 2011||Kinetech, Inc.||De-duplication of data in a data processing system|
|US8001096||31 oct. 2007||16 août 2011||Kinetech, Inc.||Computer file system using content-dependent file identifiers|
|US8028115 *||4 août 2009||27 sept. 2011||Bluearc Uk Limited||File system adapter for hardware implementation or acceleration of file system functions|
|US8041735||1 nov. 2002||18 oct. 2011||Bluearc Uk Limited||Distributed file system and method|
|US8082262||15 mars 2007||20 déc. 2011||Personalweb Technologies, LLC||Methods, systems, and devices supporting data access in a data processing system|
|US8085275 *||20 déc. 2005||27 déc. 2011||Nvidia Corporation||System and method for low-overhead push buffer jumps|
|US8099420||22 déc. 2004||17 janv. 2012||Personalweb Technologies, LLC||Accessing data in a data processing system|
|US8180897||12 juil. 2004||15 mai 2012||Bluearc Uk Limited||Apparatus and method for hardware implementation or acceleration of operating system functions|
|US8185576||30 juin 2006||22 mai 2012||Altnet, Inc.||Filter for a distributed network|
|US8190862||24 avr. 2008||29 mai 2012||International Business Machines Corporation||Hardware device for processing the tasks of an algorithm in parallel|
|US8224877||20 août 2007||17 juil. 2012||Bluearc Uk Limited||Apparatus and method for hardware-based file system|
|US8386832 *||28 oct. 2010||26 févr. 2013||Cisco Technology, Inc.||Power and data redundancy in a single wiring closet|
|US8490107||8 août 2011||16 juil. 2013||Arm Limited||Processing resource allocation within an integrated circuit supporting transaction requests of different priority levels|
|US8607031||3 févr. 2012||10 déc. 2013||International Business Machines Corporation||Hardware device for processing the tasks of an algorithm in parallel|
|US8630988||10 déc. 2008||14 janv. 2014||Verisign, Inc.||System and method for processing DNS queries|
|US8635411||18 juil. 2011||21 janv. 2014||Arm Limited||Data processing apparatus and method for managing coherency of cached data|
|US8635620||3 févr. 2012||21 janv. 2014||International Business Machines Corporation||Hardware device for processing the tasks of an algorithm in parallel|
|US8639731||26 juin 2012||28 janv. 2014||Hitachi Data Engineering UK Limited||Apparatus for managing plural versions of a root node for an object of a file system|
|US8743691 *||15 juin 2011||3 juin 2014||Foundry Networks, Llc||Priority aware MAC flow control|
|US8775508||23 avr. 2012||8 juil. 2014||Altnet, Inc.||Filter for a distributed network|
|US8788530||14 oct. 2011||22 juil. 2014||Hitachi Data Systems Engineering UK Limited||Distributed file system and method|
|US8811171||17 juil. 2013||19 août 2014||Foundry Networks, Llc||Flow control for multi-hop networks|
|US9021230 *||19 oct. 2010||28 avr. 2015||Nec Corporation||Storage device|
|US9098683||8 juin 2014||4 août 2015||Global File Systems Holdings, Llc||Filter for a distributed network|
|US9110947 *||14 sept. 2012||18 août 2015||Teradata Us, Inc.||Column-oriented task execution in a row-partitioned database system|
|US9432251||8 mars 2013||30 août 2016||Qualcomm Incorporated||Enhanced acknowledgement and retransmission mechanism|
|US9542310||13 nov. 2013||10 janv. 2017||Hitachi Data Systems Engineering UK Limited||File server node with non-volatile memory processing module coupled to cluster file server node|
|US9753848||13 nov. 2013||5 sept. 2017||Hitachi Data Systems Engineering UK Limited||Apparatus for managing a plurality of root nodes for file systems|
|US9817705||18 août 2014||14 nov. 2017||Nokia Technologies Oy||Method for enabling a communication between processes, processing system, integrated chip and module for such a chip|
|US20020057510 *||28 juin 2001||16 mai 2002||Seagate Technologies Llc||Method and apparatus for read error recovery|
|US20020165815 *||12 déc. 2001||7 nov. 2002||International Business Machines Corporation||Online marketplace with anonymous communication|
|US20020165948 *||7 mai 2001||7 nov. 2002||International Business Machines Corporation||Scalable resource discovery and reconfiguration for distributed computer networks|
|US20020165979 *||7 mai 2001||7 nov. 2002||International Business Machines Corporation||System and method for responding to resource requests in distributed computer networks|
|US20030023776 *||27 juin 2002||30 janv. 2003||Nokia Corporation||Method for enabling a communication between processes, processing system, integrated chip and module for such a chip|
|US20030028718 *||26 sept. 2002||6 févr. 2003||Storage Technology Corporation||Data storage management system and method|
|US20030084038 *||1 nov. 2002||1 mai 2003||Verisign, Inc.||Transactional memory manager|
|US20030112812 *||2 févr. 2001||19 juin 2003||Rene Duranton||Method and device for automatically attributing addresses to a plurality of modules interconnected by a communication network with complex topology|
|US20030126132 *||27 déc. 2001||3 juil. 2003||Kavuri Ravi K.||Virtual volume management system and method|
|US20030163595 *||1 oct. 2002||28 août 2003||John Ta||Task manager - method of forwarding messages among task blocks|
|US20030182528 *||19 mars 2003||25 sept. 2003||Nec Electronics Corporation||Single-chip microcomputer|
|US20040260814 *||18 juin 2003||23 déc. 2004||Utah State University||Efficient unicast-based multicast tree construction and maintenance for multimedia transmission|
|US20050050050 *||3 avr. 2003||3 mars 2005||Nobuo Kawamura||Database management methods and equipment and database management program storage media|
|US20050136992 *||23 déc. 2003||23 juin 2005||Mueller Peter D.||Providing access to auxiliary hardware in multiprocessor devices|
|US20050207235 *||17 mai 2005||22 sept. 2005||Storage Technology Corporation||Data storage management system and method|
|US20060013207 *||20 sept. 2005||19 janv. 2006||Mcmillen Robert J||Reconfigurable, fault tolerant, multistage interconnect network and protocol|
|US20060112393 *||3 janv. 2006||25 mai 2006||Ibm Corporation||Hardware device for processing the tasks of an algorithm in parallel|
|US20070014302 *||22 sept. 2006||18 janv. 2007||International Business Machines Corporation||Scalable resource discovery and reconfiguration for distributed computer networks|
|US20070022087 *||25 juil. 2006||25 janv. 2007||Parascale, Inc.||Scalable clustered storage system|
|US20070022121 *||25 juil. 2006||25 janv. 2007||Parascale, Inc.||Transparent redirection and load-balancing in a storage network|
|US20070022122 *||25 juil. 2006||25 janv. 2007||Parascale, Inc.||Asynchronous file replication and migration in a storage network|
|US20070022129 *||25 juil. 2006||25 janv. 2007||Parascale, Inc.||Rule driven automation of file placement, replication, and migration|
|US20070100808 *||19 déc. 2006||3 mai 2007||Verisign, Inc.||High speed non-concurrency controlled database|
|US20070100873 *||31 janv. 2006||3 mai 2007||Hitachi, Ltd.||Information retrieving system|
|US20070112870 *||16 nov. 2005||17 mai 2007||International Business Machines Corporation||System and method for proactive impact analysis of policy-based storage systems|
|US20070219998 *||15 mars 2006||20 sept. 2007||International Business Machines Corporation||Method and system for estimating a first access time of transactions accessing a database object|
|US20070239758 *||4 avr. 2006||11 oct. 2007||Devine John T||Loosely Coupled Log Sequence Identifiers|
|US20080005357 *||30 juin 2006||3 janv. 2008||Microsoft Corporation||Synchronizing dataflow computations, particularly in multi-processor setting|
|US20080065635 *||31 oct. 2007||13 mars 2008||Kinetech, Inc.||Similarity-based access control of data in a data processing system|
|US20080196032 *||24 avr. 2008||14 août 2008||International Business Machines Corporation||Hardware device for processing the tasks of an algorithm in parallel|
|US20080263272 *||24 juin 2008||23 oct. 2008||Storage Technology Corporation||Data storage management method|
|US20090077088 *||19 nov. 2008||19 mars 2009||International Business Machines Corporation||System for estimating a first access time of transactions accessing a database object|
|US20090106211 *||10 déc. 2008||23 avr. 2009||Verisign, Inc.||System and Method for Processing DNS Queries|
|US20090292850 *||4 août 2009||26 nov. 2009||Bluearc Uk Limited||File System Adapter for Hardware Implementation or Acceleration of File System Functions|
|US20100076617 *||24 oct. 2007||25 mars 2010||Triphase Nv||System for real-time process control|
|US20100121465 *||2 avr. 2008||13 mai 2010||Daikin Industries, Ltd.||Group management apparatus and group management program|
|US20110047407 *||28 oct. 2010||24 févr. 2011||Cisco Technology, Inc.||Power and data redundancy in a single wiring closet|
|US20120136944 *||5 avr. 2011||31 mai 2012||Futurewei Technologies, Inc.||Method For Dynamic Discovery of Control Plane Resources and Services|
|US20120147747 *||15 juin 2011||14 juin 2012||Foundry Networks, Llc, A Delaware Limited Liability Company||Priority aware mac flow control|
|US20120311294 *||19 oct. 2010||6 déc. 2012||Yoshiaki Noguchi||Storage device|
|US20150046400 *||24 oct. 2014||12 févr. 2015||Christopher Hugh Rank||Multi-Path Replication in Databases|
|US20160140202 *||22 janv. 2016||19 mai 2016||Microsoft Technology Licensing, Llc||Asynchronous replication in a distributed storage environment|
|USRE36989 *||22 sept. 1997||12 déc. 2000||Storage Technology Corporation||Virtual storage system and method|
|WO1987002155A1 *||26 sept. 1986||9 avr. 1987||Schlumberger Technology Corporation||Communication network for multiprocessor packet communication|
|WO1991014987A1 *||21 mars 1991||3 oct. 1991||Square D Company||Apparatus for networking programmable logic controllers to host computers|
|WO2002058330A2 *||14 janv. 2002||25 juil. 2002||International Business Machines Corporation||Digital baseband system|
|WO2002058330A3 *||14 janv. 2002||5 févr. 2004||Ibm||Digital baseband system|
|WO2003038683A1 *||1 nov. 2002||8 mai 2003||Verisign, Inc.||Transactional memory manager|
|Classification aux États-Unis||709/252, 709/243, 713/503, 719/310, 709/207, 714/4.2|
|Classification internationale||H04L29/00, G06F15/00, G06F15/173, G06F13/00, G06F15/80|
|Classification coopérative||G06F15/17368, H04L29/00|
|Classification européenne||G06F15/173N4, H04L29/00|
|1 avr. 1981||AS||Assignment|
Owner name: TERADATA CORPORATION, A CORP. OF CA.
Free format text: ASSIGNMENT OF ASSIGNORS INTEREST.;ASSIGNORS:NECHES PHILIP M.;HARTKE DAVID H.;STOCKTON RICHARD C.;AND OTHERS;REEL/FRAME:003878/0992
Effective date: 19810330
|26 juin 1984||CC||Certificate of correction|
|22 oct. 1985||CC||Certificate of correction|
|23 avr. 1987||FPAY||Fee payment|
Year of fee payment: 4
|15 juin 1988||AS||Assignment|
Owner name: TERADATA CORPORATION, 12945 JEFFERSON BOULEVARD, L
Free format text: ASSIGNMENT OF ASSIGNORS INTEREST.;ASSIGNOR:TERADATA CORPORATION, A CA CORP.;REEL/FRAME:004894/0440
Effective date: 19880516
Owner name: TERADATA CORPORATION, CALIFORNIA
Free format text: ASSIGNMENT OF ASSIGNORS INTEREST;ASSIGNOR:TERADATA CORPORATION, A CA CORP.;REEL/FRAME:004894/0440
Effective date: 19880516
|4 avr. 1991||FPAY||Fee payment|
Year of fee payment: 8
|27 févr. 1995||FPAY||Fee payment|
Year of fee payment: 12
|21 juil. 1998||AS||Assignment|
Owner name: NCR INTERNATIONAL, INC., OHIO
Free format text: MERGER AND CHANGE OF NAME;ASSIGNOR:TERADATA CORPORATION;REEL/FRAME:009314/0771
Effective date: 19950427
|24 nov. 1998||AS||Assignment|
Owner name: NCR CORPORATION, OHIO
Free format text: ASSIGNMENT OF ASSIGNORS INTEREST;ASSIGNOR:NCR INTERNATIONAL, INC.;REEL/FRAME:009596/0581
Effective date: 19981117